[PATCH v2 03/53] docs-rst: convert kernel-locking to ReST

Mauro Carvalho Chehab
2017-05-16T12:17:55Z

Use pandoc to convert documentation to ReST by calling
Documentation/sphinx/tmplcvt script.

- Manually adjust tables with got broken by conversion

Signed-off-by: Mauro Carvalho Chehab <mchehab@s-opensource.com>
---
Documentation/DocBook/Makefile | 1 -
Documentation/DocBook/kernel-locking.tmpl | 2151 -----------------------------
Documentation/kernel-hacking/index.rst | 1 +
Documentation/kernel-hacking/locking.rst | 1453 +++++++++++++++++++
4 files changed, 1454 insertions(+), 2152 deletions(-)
delete mode 100644 Documentation/DocBook/kernel-locking.tmpl
create mode 100644 Documentation/kernel-hacking/locking.rst

diff --git a/Documentation/DocBook/Makefile b/Documentation/DocBook/Makefile
index 7d7482b5ad92..9df94f7c2003 100644
--- a/Documentation/DocBook/Makefile
+++ b/Documentation/DocBook/Makefile
@@ -7,7 +7,6 @@
# list of DOCBOOKS.

DOCBOOKS := z8530book.xml \
- kernel-locking.xml \
networking.xml \
filesystems.xml lsm.xml kgdb.xml \
libata.xml mtdnand.xml librs.xml rapidio.xml \
diff --git a/Documentation/DocBook/kernel-locking.tmpl b/Documentation/DocBook/kernel-locking.tmpl
deleted file mode 100644
index 7c9cc4846cb6..000000000000
--- a/Documentation/DocBook/kernel-locking.tmpl
+++ /dev/null
@@ -1,2151 +0,0 @@
-<?xml version="1.0" encoding="UTF-8"?>
-<!DOCTYPE book PUBLIC "-//OASIS//DTD DocBook XML V4.1.2//EN"
- "http://www.oasis-open.org/docbook/xml/4.1.2/docbookx.dtd" []>
-
-<book id="LKLockingGuide">
- <bookinfo>
- Unreliable Guide To Locking
-
- <authorgroup>
- <author>
- <firstname>Rusty</firstname>
- <surname>Russell</surname>
- <affiliation>
-
- <email>rusty@rustcorp.com.au</email>
-
- </affiliation>
- </author>
- </authorgroup>
-
- <copyright>
- <year>2003</year>
- <holder>Rusty Russell</holder>
- </copyright>
-
- <legalnotice>
-
- This documentation is free software; you can redistribute
- it and/or modify it under the terms of the GNU General Public
- License as published by the Free Software Foundation; either
- version 2 of the License, or (at your option) any later
- version.
-
-
-
- This program is distributed in the hope that it will be
- useful, but WITHOUT ANY WARRANTY; without even the implied
- warranty of MERCHANTABILITY or FITNESS FOR A PARTICULAR PURPOSE.
- See the GNU General Public License for more details.
-
-
-
- You should have received a copy of the GNU General Public
- License along with this program; if not, write to the Free
- Software Foundation, Inc., 59 Temple Place, Suite 330, Boston,
- MA 02111-1307 USA
-
-
-
- For more details see the file COPYING in the source
- distribution of Linux.
-
- </legalnotice>
- </bookinfo>
-
- <toc></toc>
- <chapter id="intro">
- Introduction
-
- Welcome, to Rusty's Remarkably Unreliable Guide to Kernel
- Locking issues. This document describes the locking systems in
- the Linux Kernel in 2.6.
-
-
- With the wide availability of HyperThreading, and <firstterm
- linkend="gloss-preemption">preemption </firstterm> in the Linux
- Kernel, everyone hacking on the kernel needs to know the
- fundamentals of concurrency and locking for
- <firstterm linkend="gloss-smp"> SMP </firstterm>.
-
- </chapter>
-
- <chapter id="races">
- The Problem With Concurrency
-
- (Skip this if you know what a Race Condition is).
-
-
- In a normal program, you can increment a counter like so:
-
- <programlisting>
- very_important_count++;
- </programlisting>
-
-
- This is what they would expect to happen:
-
-
-
- Expected Results
-
- <tgroup cols="2" align="left">
-
-
- <row>
- <entry>Instance 1</entry>
- <entry>Instance 2</entry>
- </row>
-
-
-
- <row>
- <entry>read very_important_count (5)</entry>
- <entry></entry>
- </row>
- <row>
- <entry>add 1 (6)</entry>
- <entry></entry>
- </row>
- <row>
- <entry>write very_important_count (6)</entry>
- <entry></entry>
- </row>
- <row>
- <entry></entry>
- <entry>read very_important_count (6)</entry>
- </row>
- <row>
- <entry></entry>
- <entry>add 1 (7)</entry>
- </row>
- <row>
- <entry></entry>
- <entry>write very_important_count (7)</entry>
- </row>
-
-
- </tgroup>
-
-
-
- This is what might happen:
-
-
-
- Possible Results
-
- <tgroup cols="2" align="left">
-
- <row>
- <entry>Instance 1</entry>
- <entry>Instance 2</entry>
- </row>
-
-
-
- <row>
- <entry>read very_important_count (5)</entry>
- <entry></entry>
- </row>
- <row>
- <entry></entry>
- <entry>read very_important_count (5)</entry>
- </row>
- <row>
- <entry>add 1 (6)</entry>
- <entry></entry>
- </row>
- <row>
- <entry></entry>
- <entry>add 1 (6)</entry>
- </row>
- <row>
- <entry>write very_important_count (6)</entry>
- <entry></entry>
- </row>
- <row>
- <entry></entry>
- <entry>write very_important_count (6)</entry>
- </row>
-
- </tgroup>
-
-
- <sect1 id="race-condition">
- Race Conditions and Critical Regions
-
- This overlap, where the result depends on the
- relative timing of multiple tasks, is called a <firstterm>race condition</firstterm>.
- The piece of code containing the concurrency issue is called a
- <firstterm>critical region</firstterm>. And especially since Linux starting running
- on SMP machines, they became one of the major issues in kernel
- design and implementation.
-
-
- Preemption can have the same effect, even if there is only one
- CPU: by preempting one task during the critical region, we have
- exactly the same race condition. In this case the thread which
- preempts might run the critical region itself.
-
-
- The solution is to recognize when these simultaneous accesses
- occur, and use locks to make sure that only one instance can
- enter the critical region at any time. There are many
- friendly primitives in the Linux kernel to help you do this.
- And then there are the unfriendly primitives, but I'll pretend
- they don't exist.
-
- </sect1>
- </chapter>
-
- <chapter id="locks">
- Locking in the Linux Kernel
-
-
- If I could give you one piece of advice: never sleep with anyone
- crazier than yourself. But if I had to give you advice on
- locking: keep it simple .
-
-
-
- Be reluctant to introduce new locks.
-
-
-
- Strangely enough, this last one is the exact reverse of my advice when
- you have slept with someone crazier than yourself.
- And you should think about getting a big dog.
-
-
- <sect1 id="lock-intro">
- Two Main Types of Kernel Locks: Spinlocks and Mutexes
-
-
- There are two main types of kernel locks. The fundamental type
- is the spinlock
- (<filename class="headerfile">include/asm/spinlock.h</filename>),
- which is a very simple single-holder lock: if you can't get the
- spinlock, you keep trying (spinning) until you can. Spinlocks are
- very small and fast, and can be used anywhere.
-
-
- The second type is a mutex
- (<filename class="headerfile">include/linux/mutex.h</filename>): it
- is like a spinlock, but you may block holding a mutex.
- If you can't lock a mutex, your task will suspend itself, and be woken
- up when the mutex is released. This means the CPU can do something
- else while you are waiting. There are many cases when you simply
- can't sleep (see ), and so have to
- use a spinlock instead.
-
-
- Neither type of lock is recursive: see
- .
-
- </sect1>
-
- <sect1 id="uniprocessor">
- Locks and Uniprocessor Kernels
-
-
- For kernels compiled without <symbol>CONFIG_SMP</symbol>, and
- without <symbol>CONFIG_PREEMPT</symbol> spinlocks do not exist at
- all. This is an excellent design decision: when no-one else can
- run at the same time, there is no reason to have a lock.
-
-
-
- If the kernel is compiled without <symbol>CONFIG_SMP</symbol>,
- but <symbol>CONFIG_PREEMPT</symbol> is set, then spinlocks
- simply disable preemption, which is sufficient to prevent any
- races. For most purposes, we can think of preemption as
- equivalent to SMP, and not worry about it separately.
-
-
-
- You should always test your locking code with <symbol>CONFIG_SMP</symbol>
- and <symbol>CONFIG_PREEMPT</symbol> enabled, even if you don't have an SMP test box, because it
- will still catch some kinds of locking bugs.
-
-
-
- Mutexes still exist, because they are required for
- synchronization between <firstterm linkend="gloss-usercontext">user
- contexts</firstterm>, as we will see below.
-
- </sect1>
-
- <sect1 id="usercontextlocking">
- Locking Only In User Context
-
-
- If you have a data structure which is only ever accessed from
- user context, then you can use a simple mutex
- (<filename>include/linux/mutex.h</filename>) to protect it. This
- is the most trivial case: you initialize the mutex. Then you can
- call <function>mutex_lock_interruptible()</function> to grab the mutex,
- and <function>mutex_unlock()</function> to release it. There is also a
- <function>mutex_lock()</function>, which should be avoided, because it
- will not return if a signal is received.
-
-
-
- Example: <filename>net/netfilter/nf_sockopt.c</filename> allows
- registration of new <function>setsockopt()</function> and
- <function>getsockopt()</function> calls, with
- <function>nf_register_sockopt()</function>. Registration and
- de-registration are only done on module load and unload (and boot
- time, where there is no concurrency), and the list of registrations
- is only consulted for an unknown <function>setsockopt()</function>
- or <function>getsockopt()</function> system call. The
- <varname>nf_sockopt_mutex</varname> is perfect to protect this,
- especially since the setsockopt and getsockopt calls may well
- sleep.
-
- </sect1>
-
- <sect1 id="lock-user-bh">
- Locking Between User Context and Softirqs
-
-
- If a <firstterm linkend="gloss-softirq">softirq</firstterm> shares
- data with user context, you have two problems. Firstly, the current
- user context can be interrupted by a softirq, and secondly, the
- critical region could be entered from another CPU. This is where
- <function>spin_lock_bh()</function>
- (<filename class="headerfile">include/linux/spinlock.h</filename>) is
- used. It disables softirqs on that CPU, then grabs the lock.
- <function>spin_unlock_bh()</function> does the reverse. (The
- '_bh' suffix is a historical reference to "Bottom Halves", the
- old name for software interrupts. It should really be
- called spin_lock_softirq()' in a perfect world).
-
-
-
- Note that you can also use <function>spin_lock_irq()</function>
- or <function>spin_lock_irqsave()</function> here, which stop
- hardware interrupts as well: see .
-
-
-
- This works perfectly for <firstterm linkend="gloss-up"> UP
- </firstterm> as well: the spin lock vanishes, and this macro
- simply becomes <function>local_bh_disable()</function>
- (<filename class="headerfile">include/linux/interrupt.h</filename>), which
- protects you from the softirq being run.
-
- </sect1>
-
- <sect1 id="lock-user-tasklet">
- Locking Between User Context and Tasklets
-
-
- This is exactly the same as above, because <firstterm
- linkend="gloss-tasklet">tasklets</firstterm> are actually run
- from a softirq.
-
- </sect1>
-
- <sect1 id="lock-user-timers">
- Locking Between User Context and Timers
-
-
- This, too, is exactly the same as above, because <firstterm
- linkend="gloss-timers">timers</firstterm> are actually run from
- a softirq. From a locking point of view, tasklets and timers
- are identical.
-
- </sect1>
-
- <sect1 id="lock-tasklets">
- Locking Between Tasklets/Timers
-
-
- Sometimes a tasklet or timer might want to share data with
- another tasklet or timer.
-
-
- <sect2 id="lock-tasklets-same">
- The Same Tasklet/Timer
-
- Since a tasklet is never run on two CPUs at once, you don't
- need to worry about your tasklet being reentrant (running
- twice at once), even on SMP.
-
- </sect2>
-
- <sect2 id="lock-tasklets-different">
- Different Tasklets/Timers
-
- If another tasklet/timer wants
- to share data with your tasklet or timer , you will both need to use
- <function>spin_lock()</function> and
- <function>spin_unlock()</function> calls.
- <function>spin_lock_bh()</function> is
- unnecessary here, as you are already in a tasklet, and
- none will be run on the same CPU.
-
- </sect2>
- </sect1>
-
- <sect1 id="lock-softirqs">
- Locking Between Softirqs
-
-
- Often a softirq might
- want to share data with itself or a tasklet/timer.
-
-
- <sect2 id="lock-softirqs-same">
- The Same Softirq
-
-
- The same softirq can run on the other CPUs: you can use a
- per-CPU array (see ) for better
- performance. If you're going so far as to use a softirq,
- you probably care about scalable performance enough
- to justify the extra complexity.
-
-
-
- You'll need to use <function>spin_lock()</function> and
- <function>spin_unlock()</function> for shared data.
-
- </sect2>
-
- <sect2 id="lock-softirqs-different">
- Different Softirqs
-
-
- You'll need to use <function>spin_lock()</function> and
- <function>spin_unlock()</function> for shared data, whether it
- be a timer, tasklet, different softirq or the same or another
- softirq: any of them could be running on a different CPU.
-
- </sect2>
- </sect1>
- </chapter>
-
- <chapter id="hardirq-context">
- Hard IRQ Context
-
-
- Hardware interrupts usually communicate with a
- tasklet or softirq. Frequently this involves putting work in a
- queue, which the softirq will take out.
-
-
- <sect1 id="hardirq-softirq">
- Locking Between Hard IRQ and Softirqs/Tasklets
-
-
- If a hardware irq handler shares data with a softirq, you have
- two concerns. Firstly, the softirq processing can be
- interrupted by a hardware interrupt, and secondly, the
- critical region could be entered by a hardware interrupt on
- another CPU. This is where <function>spin_lock_irq()</function> is
- used. It is defined to disable interrupts on that cpu, then grab
- the lock. <function>spin_unlock_irq()</function> does the reverse.
-
-
-
- The irq handler does not to use
- <function>spin_lock_irq()</function>, because the softirq cannot
- run while the irq handler is running: it can use
- <function>spin_lock()</function>, which is slightly faster. The
- only exception would be if a different hardware irq handler uses
- the same lock: <function>spin_lock_irq()</function> will stop
- that from interrupting us.
-
-
-
- This works perfectly for UP as well: the spin lock vanishes,
- and this macro simply becomes <function>local_irq_disable()</function>
- (<filename class="headerfile">include/asm/smp.h</filename>), which
- protects you from the softirq/tasklet/BH being run.
-
-
-
- <function>spin_lock_irqsave()</function>
- (<filename>include/linux/spinlock.h</filename>) is a variant
- which saves whether interrupts were on or off in a flags word,
- which is passed to <function>spin_unlock_irqrestore()</function>. This
- means that the same code can be used inside an hard irq handler (where
- interrupts are already off) and in softirqs (where the irq
- disabling is required).
-
-
-
- Note that softirqs (and hence tasklets and timers) are run on
- return from hardware interrupts, so
- <function>spin_lock_irq()</function> also stops these. In that
- sense, <function>spin_lock_irqsave()</function> is the most
- general and powerful locking function.
-
-
- </sect1>
- <sect1 id="hardirq-hardirq">
- Locking Between Two Hard IRQ Handlers
-
- It is rare to have to share data between two IRQ handlers, but
- if you do, <function>spin_lock_irqsave()</function> should be
- used: it is architecture-specific whether all interrupts are
- disabled inside irq handlers themselves.
-
- </sect1>
-
- </chapter>
-
- <chapter id="cheatsheet">
- Cheat Sheet For Locking
-
- Pete Zaitcev gives the following summary:
-
-
-
-
- If you are in a process context (any syscall) and want to
- lock other process out, use a mutex. You can take a mutex
- and sleep (<function>copy_from_user*(</function> or
- <function>kmalloc(x,GFP_KERNEL)</function>).
-
-
-
-
- Otherwise (== data can be touched in an interrupt), use
- <function>spin_lock_irqsave()</function> and
- <function>spin_unlock_irqrestore()</function>.
-
-
-
-
- Avoid holding spinlock for more than 5 lines of code and
- across any function call (except accessors like
- <function>readb</function>).
-
-
-
-
- <sect1 id="minimum-lock-reqirements">
- Table of Minimum Requirements
-
- The following table lists the minimum
- locking requirements between various contexts. In some cases,
- the same context can only be running on one CPU at a time, so
- no locking is required for that context (eg. a particular
- thread can only run on one CPU at a time, but if it needs
- shares data with another thread, locking is required).
-
-
- Remember the advice above: you can always use
- <function>spin_lock_irqsave()</function>, which is a superset
- of all other spinlock primitives.
-
-
-
- Table of Locking Requirements
-<tgroup cols="11">
-
-
-<row>
-<entry></entry>
-<entry>IRQ Handler A</entry>
-<entry>IRQ Handler B</entry>
-<entry>Softirq A</entry>
-<entry>Softirq B</entry>
-<entry>Tasklet A</entry>
-<entry>Tasklet B</entry>
-<entry>Timer A</entry>
-<entry>Timer B</entry>
-<entry>User Context A</entry>
-<entry>User Context B</entry>
-</row>
-
-<row>
-<entry>IRQ Handler A</entry>
-<entry>None</entry>
-</row>
-
-<row>
-<entry>IRQ Handler B</entry>
-<entry>SLIS</entry>
-<entry>None</entry>
-</row>
-
-<row>
-<entry>Softirq A</entry>
-<entry>SLI</entry>
-<entry>SLI</entry>
-<entry>SL</entry>
-</row>
-
-<row>
-<entry>Softirq B</entry>
-<entry>SLI</entry>
-<entry>SLI</entry>
-<entry>SL</entry>
-<entry>SL</entry>
-</row>
-
-<row>
-<entry>Tasklet A</entry>
-<entry>SLI</entry>
-<entry>SLI</entry>
-<entry>SL</entry>
-<entry>SL</entry>
-<entry>None</entry>
-</row>
-
-<row>
-<entry>Tasklet B</entry>
-<entry>SLI</entry>
-<entry>SLI</entry>
-<entry>SL</entry>
-<entry>SL</entry>
-<entry>SL</entry>
-<entry>None</entry>
-</row>
-
-<row>
-<entry>Timer A</entry>
-<entry>SLI</entry>
-<entry>SLI</entry>
-<entry>SL</entry>
-<entry>SL</entry>
-<entry>SL</entry>
-<entry>SL</entry>
-<entry>None</entry>
-</row>
-
-<row>
-<entry>Timer B</entry>
-<entry>SLI</entry>
-<entry>SLI</entry>
-<entry>SL</entry>
-<entry>SL</entry>
-<entry>SL</entry>
-<entry>SL</entry>
-<entry>SL</entry>
-<entry>None</entry>
-</row>
-
-<row>
-<entry>User Context A</entry>
-<entry>SLI</entry>
-<entry>SLI</entry>
-<entry>SLBH</entry>
-<entry>SLBH</entry>
-<entry>SLBH</entry>
-<entry>SLBH</entry>
-<entry>SLBH</entry>
-<entry>SLBH</entry>
-<entry>None</entry>
-</row>
-
-<row>
-<entry>User Context B</entry>
-<entry>SLI</entry>
-<entry>SLI</entry>
-<entry>SLBH</entry>
-<entry>SLBH</entry>
-<entry>SLBH</entry>
-<entry>SLBH</entry>
-<entry>SLBH</entry>
-<entry>SLBH</entry>
-<entry>MLI</entry>
-<entry>None</entry>
-</row>
-
-
-</tgroup>
-
-
-
- Legend for Locking Requirements Table
-<tgroup cols="2">
-
-
-<row>
-<entry>SLIS</entry>
-<entry>spin_lock_irqsave</entry>
-</row>
-<row>
-<entry>SLI</entry>
-<entry>spin_lock_irq</entry>
-</row>
-<row>
-<entry>SL</entry>
-<entry>spin_lock</entry>
-</row>
-<row>
-<entry>SLBH</entry>
-<entry>spin_lock_bh</entry>
-</row>
-<row>
-<entry>MLI</entry>
-<entry>mutex_lock_interruptible</entry>
-</row>
-
-
-</tgroup>
-
-
-</sect1>
-</chapter>
-
-<chapter id="trylock-functions">
- The trylock Functions
-
- There are functions that try to acquire a lock only once and immediately
- return a value telling about success or failure to acquire the lock.
- They can be used if you need no access to the data protected with the lock
- when some other thread is holding the lock. You should acquire the lock
- later if you then need access to the data protected with the lock.
-
-
-
- <function>spin_trylock()</function> does not spin but returns non-zero if
- it acquires the spinlock on the first try or 0 if not. This function can
- be used in all contexts like <function>spin_lock</function>: you must have
- disabled the contexts that might interrupt you and acquire the spin lock.
-
-
-
- <function>mutex_trylock()</function> does not suspend your task
- but returns non-zero if it could lock the mutex on the first try
- or 0 if not. This function cannot be safely used in hardware or software
- interrupt contexts despite not sleeping.
-
-</chapter>
-
- <chapter id="Examples">
- Common Examples
-
-Let's step through a simple example: a cache of number to name
-mappings. The cache keeps a count of how often each of the objects is
-used, and when it gets full, throws out the least used one.
-
-
-
- <sect1 id="examples-usercontext">
- All In User Context
-
-For our first example, we assume that all operations are in user
-context (ie. from system calls), so we can sleep. This means we can
-use a mutex to protect the cache and all the objects within
-it. Here's the code:
-
-
- <programlisting>
-#include &lt;linux/list.h&gt;
-#include &lt;linux/slab.h&gt;
-#include &lt;linux/string.h&gt;
-#include &lt;linux/mutex.h&gt;
-#include &lt;asm/errno.h&gt;
-
-struct object
-{
- struct list_head list;
- int id;
- char name[32];
- int popularity;
-};
-
-/* Protects the cache, cache_num, and the objects within it */
-static DEFINE_MUTEX(cache_lock);
-static LIST_HEAD(cache);
-static unsigned int cache_num = 0;
-#define MAX_CACHE_SIZE 10
-
-/* Must be holding cache_lock */
-static struct object *__cache_find(int id)
-{
- struct object *i;
-
- list_for_each_entry(i, &amp;cache, list)
- if (i-&gt;id == id) {
- i-&gt;popularity++;
- return i;
- }
- return NULL;
-}
-
-/* Must be holding cache_lock */
-static void __cache_delete(struct object *obj)
-{
- BUG_ON(!obj);
- list_del(&amp;obj-&gt;list);
- kfree(obj);
- cache_num--;
-}
-
-/* Must be holding cache_lock */
-static void __cache_add(struct object *obj)
-{
- list_add(&amp;obj-&gt;list, &amp;cache);
- if (++cache_num > MAX_CACHE_SIZE) {
- struct object *i, *outcast = NULL;
- list_for_each_entry(i, &amp;cache, list) {
- if (!outcast || i-&gt;popularity &lt; outcast-&gt;popularity)
- outcast = i;
- }
- __cache_delete(outcast);
- }
-}
-
-int cache_add(int id, const char *name)
-{
- struct object *obj;
-
- if ((obj = kmalloc(sizeof(*obj), GFP_KERNEL)) == NULL)
- return -ENOMEM;
-
- strlcpy(obj-&gt;name, name, sizeof(obj-&gt;name));
- obj-&gt;id = id;
- obj-&gt;popularity = 0;
-
- mutex_lock(&amp;cache_lock);
- __cache_add(obj);
- mutex_unlock(&amp;cache_lock);
- return 0;
-}
-
-void cache_delete(int id)
-{
- mutex_lock(&amp;cache_lock);
- __cache_delete(__cache_find(id));
- mutex_unlock(&amp;cache_lock);
-}
-
-int cache_find(int id, char *name)
-{
- struct object *obj;
- int ret = -ENOENT;
-
- mutex_lock(&amp;cache_lock);
- obj = __cache_find(id);
- if (obj) {
- ret = 0;
- strcpy(name, obj-&gt;name);
- }
- mutex_unlock(&amp;cache_lock);
- return ret;
-}
-</programlisting>
-
-
-Note that we always make sure we have the cache_lock when we add,
-delete, or look up the cache: both the cache infrastructure itself and
-the contents of the objects are protected by the lock. In this case
-it's easy, since we copy the data for the user, and never let them
-access the objects directly.
-
-
-There is a slight (and common) optimization here: in
-<function>cache_add</function> we set up the fields of the object
-before grabbing the lock. This is safe, as no-one else can access it
-until we put it in cache.
-
- </sect1>
-
- <sect1 id="examples-interrupt">
- Accessing From Interrupt Context
-
-Now consider the case where <function>cache_find</function> can be
-called from interrupt context: either a hardware interrupt or a
-softirq. An example would be a timer which deletes object from the
-cache.
-
-
-The change is shown below, in standard patch format: the
-<symbol>-</symbol> are lines which are taken away, and the
-<symbol>+</symbol> are lines which are added.
-
-<programlisting>
---- cache.c.usercontext 2003-12-09 13:58:54.000000000 +1100
-+++ cache.c.interrupt 2003-12-09 14:07:49.000000000 +1100
-@@ -12,7 +12,7 @@
- int popularity;
- };
-
--static DEFINE_MUTEX(cache_lock);
-+static DEFINE_SPINLOCK(cache_lock);
- static LIST_HEAD(cache);
- static unsigned int cache_num = 0;
- #define MAX_CACHE_SIZE 10
-@@ -55,6 +55,7 @@
- int cache_add(int id, const char *name)
- {
- struct object *obj;
-+ unsigned long flags;
-
- if ((obj = kmalloc(sizeof(*obj), GFP_KERNEL)) == NULL)
- return -ENOMEM;
-@@ -63,30 +64,33 @@
- obj-&gt;id = id;
- obj-&gt;popularity = 0;
-
-- mutex_lock(&amp;cache_lock);
-+ spin_lock_irqsave(&amp;cache_lock, flags);
- __cache_add(obj);
-- mutex_unlock(&amp;cache_lock);
-+ spin_unlock_irqrestore(&amp;cache_lock, flags);
- return 0;
- }
-
- void cache_delete(int id)
- {
-- mutex_lock(&amp;cache_lock);
-+ unsigned long flags;
-+
-+ spin_lock_irqsave(&amp;cache_lock, flags);
- __cache_delete(__cache_find(id));
-- mutex_unlock(&amp;cache_lock);
-+ spin_unlock_irqrestore(&amp;cache_lock, flags);
- }
-
- int cache_find(int id, char *name)
- {
- struct object *obj;
- int ret = -ENOENT;
-+ unsigned long flags;
-
-- mutex_lock(&amp;cache_lock);
-+ spin_lock_irqsave(&amp;cache_lock, flags);
- obj = __cache_find(id);
- if (obj) {
- ret = 0;
- strcpy(name, obj-&gt;name);
- }
-- mutex_unlock(&amp;cache_lock);
-+ spin_unlock_irqrestore(&amp;cache_lock, flags);
- return ret;
- }
-</programlisting>
-
-
-Note that the <function>spin_lock_irqsave</function> will turn off
-interrupts if they are on, otherwise does nothing (if we are already
-in an interrupt handler), hence these functions are safe to call from
-any context.
-
-
-Unfortunately, <function>cache_add</function> calls
-<function>kmalloc</function> with the <symbol>GFP_KERNEL</symbol>
-flag, which is only legal in user context. I have assumed that
-<function>cache_add</function> is still only called in user context,
-otherwise this should become a parameter to
-<function>cache_add</function>.
-
- </sect1>
- <sect1 id="examples-refcnt">
- Exposing Objects Outside This File
-
-If our objects contained more information, it might not be sufficient
-to copy the information in and out: other parts of the code might want
-to keep pointers to these objects, for example, rather than looking up
-the id every time. This produces two problems.
-
-
-The first problem is that we use the <symbol>cache_lock</symbol> to
-protect objects: we'd need to make this non-static so the rest of the
-code can use it. This makes locking trickier, as it is no longer all
-in one place.
-
-
-The second problem is the lifetime problem: if another structure keeps
-a pointer to an object, it presumably expects that pointer to remain
-valid. Unfortunately, this is only guaranteed while you hold the
-lock, otherwise someone might call <function>cache_delete</function>
-and even worse, add another object, re-using the same address.
-
-
-As there is only one lock, you can't hold it forever: no-one else would
-get any work done.
-
-
-The solution to this problem is to use a reference count: everyone who
-has a pointer to the object increases it when they first get the
-object, and drops the reference count when they're finished with it.
-Whoever drops it to zero knows it is unused, and can actually delete it.
-
-
-Here is the code:
-
-
-<programlisting>
---- cache.c.interrupt 2003-12-09 14:25:43.000000000 +1100
-+++ cache.c.refcnt 2003-12-09 14:33:05.000000000 +1100
-@@ -7,6 +7,7 @@
- struct object
- {
- struct list_head list;
-+ unsigned int refcnt;
- int id;
- char name[32];
- int popularity;
-@@ -17,6 +18,35 @@
- static unsigned int cache_num = 0;
- #define MAX_CACHE_SIZE 10
-
-+static void __object_put(struct object *obj)
-+{
-+ if (--obj-&gt;refcnt == 0)
-+ kfree(obj);
-+}
-+
-+static void __object_get(struct object *obj)
-+{
-+ obj-&gt;refcnt++;
-+}
-+
-+void object_put(struct object *obj)
-+{
-+ unsigned long flags;
-+
-+ spin_lock_irqsave(&amp;cache_lock, flags);
-+ __object_put(obj);
-+ spin_unlock_irqrestore(&amp;cache_lock, flags);
-+}
-+
-+void object_get(struct object *obj)
-+{
-+ unsigned long flags;
-+
-+ spin_lock_irqsave(&amp;cache_lock, flags);
-+ __object_get(obj);
-+ spin_unlock_irqrestore(&amp;cache_lock, flags);
-+}
-+
- /* Must be holding cache_lock */
- static struct object *__cache_find(int id)
- {
-@@ -35,6 +65,7 @@
- {
- BUG_ON(!obj);
- list_del(&amp;obj-&gt;list);
-+ __object_put(obj);
- cache_num--;
- }
-
-@@ -63,6 +94,7 @@
- strlcpy(obj-&gt;name, name, sizeof(obj-&gt;name));
- obj-&gt;id = id;
- obj-&gt;popularity = 0;
-+ obj-&gt;refcnt = 1; /* The cache holds a reference */
-
- spin_lock_irqsave(&amp;cache_lock, flags);
- __cache_add(obj);
-@@ -79,18 +111,15 @@
- spin_unlock_irqrestore(&amp;cache_lock, flags);
- }
-
--int cache_find(int id, char *name)
-+struct object *cache_find(int id)
- {
- struct object *obj;
-- int ret = -ENOENT;
- unsigned long flags;
-
- spin_lock_irqsave(&amp;cache_lock, flags);
- obj = __cache_find(id);
-- if (obj) {
-- ret = 0;
-- strcpy(name, obj-&gt;name);
-- }
-+ if (obj)
-+ __object_get(obj);
- spin_unlock_irqrestore(&amp;cache_lock, flags);
-- return ret;
-+ return obj;
- }
-</programlisting>
-
-
-We encapsulate the reference counting in the standard 'get' and 'put'
-functions. Now we can return the object itself from
-<function>cache_find</function> which has the advantage that the user
-can now sleep holding the object (eg. to
-<function>copy_to_user</function> to name to userspace).
-
-
-The other point to note is that I said a reference should be held for
-every pointer to the object: thus the reference count is 1 when first
-inserted into the cache. In some versions the framework does not hold
-a reference count, but they are more complicated.
-
-
- <sect2 id="examples-refcnt-atomic">
- Using Atomic Operations For The Reference Count
-
-In practice, <type>atomic_t</type> would usually be used for
-<structfield>refcnt</structfield>. There are a number of atomic
-operations defined in
-
-<filename class="headerfile">include/asm/atomic.h</filename>: these are
-guaranteed to be seen atomically from all CPUs in the system, so no
-lock is required. In this case, it is simpler than using spinlocks,
-although for anything non-trivial using spinlocks is clearer. The
-<function>atomic_inc</function> and
-<function>atomic_dec_and_test</function> are used instead of the
-standard increment and decrement operators, and the lock is no longer
-used to protect the reference count itself.
-
-
-<programlisting>
---- cache.c.refcnt 2003-12-09 15:00:35.000000000 +1100
-+++ cache.c.refcnt-atomic 2003-12-11 15:49:42.000000000 +1100
-@@ -7,7 +7,7 @@
- struct object
- {
- struct list_head list;
-- unsigned int refcnt;
-+ atomic_t refcnt;
- int id;
- char name[32];
- int popularity;
-@@ -18,33 +18,15 @@
- static unsigned int cache_num = 0;
- #define MAX_CACHE_SIZE 10
-
--static void __object_put(struct object *obj)
--{
-- if (--obj-&gt;refcnt == 0)
-- kfree(obj);
--}
--
--static void __object_get(struct object *obj)
--{
-- obj-&gt;refcnt++;
--}
--
- void object_put(struct object *obj)
- {
-- unsigned long flags;
--
-- spin_lock_irqsave(&amp;cache_lock, flags);
-- __object_put(obj);
-- spin_unlock_irqrestore(&amp;cache_lock, flags);
-+ if (atomic_dec_and_test(&amp;obj-&gt;refcnt))
-+ kfree(obj);
- }
-
- void object_get(struct object *obj)
- {
-- unsigned long flags;
--
-- spin_lock_irqsave(&amp;cache_lock, flags);
-- __object_get(obj);
-- spin_unlock_irqrestore(&amp;cache_lock, flags);
-+ atomic_inc(&amp;obj-&gt;refcnt);
- }
-
- /* Must be holding cache_lock */
-@@ -65,7 +47,7 @@
- {
- BUG_ON(!obj);
- list_del(&amp;obj-&gt;list);
-- __object_put(obj);
-+ object_put(obj);
- cache_num--;
- }
-
-@@ -94,7 +76,7 @@
- strlcpy(obj-&gt;name, name, sizeof(obj-&gt;name));
- obj-&gt;id = id;
- obj-&gt;popularity = 0;
-- obj-&gt;refcnt = 1; /* The cache holds a reference */
-+ atomic_set(&amp;obj-&gt;refcnt, 1); /* The cache holds a reference */
-
- spin_lock_irqsave(&amp;cache_lock, flags);
- __cache_add(obj);
-@@ -119,7 +101,7 @@
- spin_lock_irqsave(&amp;cache_lock, flags);
- obj = __cache_find(id);
- if (obj)
-- __object_get(obj);
-+ object_get(obj);
- spin_unlock_irqrestore(&amp;cache_lock, flags);
- return obj;
- }
-</programlisting>
-</sect2>
-</sect1>
-
- <sect1 id="examples-lock-per-obj">
- Protecting The Objects Themselves
-
-In these examples, we assumed that the objects (except the reference
-counts) never changed once they are created. If we wanted to allow
-the name to change, there are three possibilities:
-
-
-
-
-You can make <symbol>cache_lock</symbol> non-static, and tell people
-to grab that lock before changing the name in any object.
-
-
-
-
-You can provide a <function>cache_obj_rename</function> which grabs
-this lock and changes the name for the caller, and tell everyone to
-use that function.
-
-
-
-
-You can make the <symbol>cache_lock</symbol> protect only the cache
-itself, and use another lock to protect the name.
-
-
-
-
-
-Theoretically, you can make the locks as fine-grained as one lock for
-every field, for every object. In practice, the most common variants
-are:
-
-
-
-
-One lock which protects the infrastructure (the <symbol>cache</symbol>
-list in this example) and all the objects. This is what we have done
-so far.
-
-
-
-
-One lock which protects the infrastructure (including the list
-pointers inside the objects), and one lock inside the object which
-protects the rest of that object.
-
-
-
-
-Multiple locks to protect the infrastructure (eg. one lock per hash
-chain), possibly with a separate per-object lock.
-
-
-
-
-
-Here is the "lock-per-object" implementation:
-
-<programlisting>
---- cache.c.refcnt-atomic 2003-12-11 15:50:54.000000000 +1100
-+++ cache.c.perobjectlock 2003-12-11 17:15:03.000000000 +1100
-@@ -6,11 +6,17 @@
-
- struct object
- {
-+ /* These two protected by cache_lock. */
- struct list_head list;
-+ int popularity;
-+
- atomic_t refcnt;
-+
-+ /* Doesn't change once created. */
- int id;
-+
-+ spinlock_t lock; /* Protects the name */
- char name[32];
-- int popularity;
- };
-
- static DEFINE_SPINLOCK(cache_lock);
-@@ -77,6 +84,7 @@
- obj-&gt;id = id;
- obj-&gt;popularity = 0;
- atomic_set(&amp;obj-&gt;refcnt, 1); /* The cache holds a reference */
-+ spin_lock_init(&amp;obj-&gt;lock);
-
- spin_lock_irqsave(&amp;cache_lock, flags);
- __cache_add(obj);
-</programlisting>
-
-
-Note that I decide that the <structfield>popularity</structfield>
-count should be protected by the <symbol>cache_lock</symbol> rather
-than the per-object lock: this is because it (like the
-<structname>struct list_head</structname> inside the object) is
-logically part of the infrastructure. This way, I don't need to grab
-the lock of every object in <function>__cache_add</function> when
-seeking the least popular.
-
-
-
-I also decided that the <structfield>id</structfield> member is
-unchangeable, so I don't need to grab each object lock in
-<function>__cache_find()</function> to examine the
-<structfield>id</structfield>: the object lock is only used by a
-caller who wants to read or write the <structfield>name</structfield>
-field.
-
-
-
-Note also that I added a comment describing what data was protected by
-which locks. This is extremely important, as it describes the runtime
-behavior of the code, and can be hard to gain from just reading. And
-as Alan Cox says, <quote>Lock data, not code</quote>.
-
-</sect1>
-</chapter>
-
- <chapter id="common-problems">
- Common Problems
- <sect1 id="deadlock">
- Deadlock: Simple and Advanced
-
-
- There is a coding bug where a piece of code tries to grab a
- spinlock twice: it will spin forever, waiting for the lock to
- be released (spinlocks, rwlocks and mutexes are not
- recursive in Linux). This is trivial to diagnose: not a
- stay-up-five-nights-talk-to-fluffy-code-bunnies kind of
- problem.
-
-
-
- For a slightly more complex case, imagine you have a region
- shared by a softirq and user context. If you use a
- <function>spin_lock()</function> call to protect it, it is
- possible that the user context will be interrupted by the softirq
- while it holds the lock, and the softirq will then spin
- forever trying to get the same lock.
-
-
-
- Both of these are called deadlock, and as shown above, it can
- occur even with a single CPU (although not on UP compiles,
- since spinlocks vanish on kernel compiles with
- <symbol>CONFIG_SMP</symbol>=n. You'll still get data corruption
- in the second example).
-
-
-
- This complete lockup is easy to diagnose: on SMP boxes the
- watchdog timer or compiling with <symbol>DEBUG_SPINLOCK</symbol> set
- (<filename>include/linux/spinlock.h</filename>) will show this up
- immediately when it happens.
-
-
-
- A more complex problem is the so-called 'deadly embrace',
- involving two or more locks. Say you have a hash table: each
- entry in the table is a spinlock, and a chain of hashed
- objects. Inside a softirq handler, you sometimes want to
- alter an object from one place in the hash to another: you
- grab the spinlock of the old hash chain and the spinlock of
- the new hash chain, and delete the object from the old one,
- and insert it in the new one.
-
-
-
- There are two problems here. First, if your code ever
- tries to move the object to the same chain, it will deadlock
- with itself as it tries to lock it twice. Secondly, if the
- same softirq on another CPU is trying to move another object
- in the reverse direction, the following could happen:
-
-
-
- Consequences
-
- <tgroup cols="2" align="left">
-
-
- <row>
- <entry>CPU 1</entry>
- <entry>CPU 2</entry>
- </row>
-
-
-
- <row>
- <entry>Grab lock A -&gt; OK</entry>
- <entry>Grab lock B -&gt; OK</entry>
- </row>
- <row>
- <entry>Grab lock B -&gt; spin</entry>
- <entry>Grab lock A -&gt; spin</entry>
- </row>
-
- </tgroup>
-
-
-
- The two CPUs will spin forever, waiting for the other to give up
- their lock. It will look, smell, and feel like a crash.
-
- </sect1>
-
- <sect1 id="techs-deadlock-prevent">
- Preventing Deadlock
-
-
- Textbooks will tell you that if you always lock in the same
- order, you will never get this kind of deadlock. Practice
- will tell you that this approach doesn't scale: when I
- create a new lock, I don't understand enough of the kernel
- to figure out where in the 5000 lock hierarchy it will fit.
-
-
-
- The best locks are encapsulated: they never get exposed in
- headers, and are never held around calls to non-trivial
- functions outside the same file. You can read through this
- code and see that it will never deadlock, because it never
- tries to grab another lock while it has that one. People
- using your code don't even need to know you are using a
- lock.
-
-
-
- A classic problem here is when you provide callbacks or
- hooks: if you call these with the lock held, you risk simple
- deadlock, or a deadly embrace (who knows what the callback
- will do?). Remember, the other programmers are out to get
- you, so don't do this.
-
-
- <sect2 id="techs-deadlock-overprevent">
- Overzealous Prevention Of Deadlocks
-
-
- Deadlocks are problematic, but not as bad as data
- corruption. Code which grabs a read lock, searches a list,
- fails to find what it wants, drops the read lock, grabs a
- write lock and inserts the object has a race condition.
-
-
-
- If you don't see why, please stay the fuck away from my code.
-
- </sect2>
- </sect1>
-
- <sect1 id="racing-timers">
- Racing Timers: A Kernel Pastime
-
-
- Timers can produce their own special problems with races.
- Consider a collection of objects (list, hash, etc) where each
- object has a timer which is due to destroy it.
-
-
-
- If you want to destroy the entire collection (say on module
- removal), you might do the following:
-
-
- <programlisting>
- /* THIS CODE BAD BAD BAD BAD: IF IT WAS ANY WORSE IT WOULD USE
- HUNGARIAN NOTATION */
- spin_lock_bh(&amp;list_lock);
-
- while (list) {
- struct foo *next = list-&gt;next;
- del_timer(&amp;list-&gt;timer);
- kfree(list);
- list = next;
- }
-
- spin_unlock_bh(&amp;list_lock);
- </programlisting>
-
-
- Sooner or later, this will crash on SMP, because a timer can
- have just gone off before the <function>spin_lock_bh()</function>,
- and it will only get the lock after we
- <function>spin_unlock_bh()</function>, and then try to free
- the element (which has already been freed!).
-
-
-
- This can be avoided by checking the result of
- <function>del_timer()</function>: if it returns
- <returnvalue>1</returnvalue>, the timer has been deleted.
- If <returnvalue>0</returnvalue>, it means (in this
- case) that it is currently running, so we can do:
-
-
- <programlisting>
- retry:
- spin_lock_bh(&amp;list_lock);
-
- while (list) {
- struct foo *next = list-&gt;next;
- if (!del_timer(&amp;list-&gt;timer)) {
- /* Give timer a chance to delete this */
- spin_unlock_bh(&amp;list_lock);
- goto retry;
- }
- kfree(list);
- list = next;
- }
-
- spin_unlock_bh(&amp;list_lock);
- </programlisting>
-
-
- Another common problem is deleting timers which restart
- themselves (by calling <function>add_timer()</function> at the end
- of their timer function). Because this is a fairly common case
- which is prone to races, you should use <function>del_timer_sync()</function>
- (<filename class="headerfile">include/linux/timer.h</filename>)
- to handle this case. It returns the number of times the timer
- had to be deleted before we finally stopped it from adding itself back
- in.
-
- </sect1>
-
- </chapter>
-
- <chapter id="Efficiency">
- Locking Speed
-
-
-There are three main things to worry about when considering speed of
-some code which does locking. First is concurrency: how many things
-are going to be waiting while someone else is holding a lock. Second
-is the time taken to actually acquire and release an uncontended lock.
-Third is using fewer, or smarter locks. I'm assuming that the lock is
-used fairly often: otherwise, you wouldn't be concerned about
-efficiency.
-
-
-Concurrency depends on how long the lock is usually held: you should
-hold the lock for as long as needed, but no longer. In the cache
-example, we always create the object without the lock held, and then
-grab the lock only when we are ready to insert it in the list.
-
-
-Acquisition times depend on how much damage the lock operations do to
-the pipeline (pipeline stalls) and how likely it is that this CPU was
-the last one to grab the lock (ie. is the lock cache-hot for this
-CPU): on a machine with more CPUs, this likelihood drops fast.
-Consider a 700MHz Intel Pentium III: an instruction takes about 0.7ns,
-an atomic increment takes about 58ns, a lock which is cache-hot on
-this CPU takes 160ns, and a cacheline transfer from another CPU takes
-an additional 170 to 360ns. (These figures from Paul McKenney's
- Linux
-Journal RCU article ).
-
-
-These two aims conflict: holding a lock for a short time might be done
-by splitting locks into parts (such as in our final per-object-lock
-example), but this increases the number of lock acquisitions, and the
-results are often slower than having a single lock. This is another
-reason to advocate locking simplicity.
-
-
-The third concern is addressed below: there are some methods to reduce
-the amount of locking which needs to be done.
-
-
- <sect1 id="efficiency-rwlocks">
- Read/Write Lock Variants
-
-
- Both spinlocks and mutexes have read/write variants:
- <type>rwlock_t</type> and <structname>struct rw_semaphore</structname>.
- These divide users into two classes: the readers and the writers. If
- you are only reading the data, you can get a read lock, but to write to
- the data you need the write lock. Many people can hold a read lock,
- but a writer must be sole holder.
-
-
-
- If your code divides neatly along reader/writer lines (as our
- cache code does), and the lock is held by readers for
- significant lengths of time, using these locks can help. They
- are slightly slower than the normal locks though, so in practice
- <type>rwlock_t</type> is not usually worthwhile.
-
- </sect1>
-
- <sect1 id="efficiency-read-copy-update">
- Avoiding Locks: Read Copy Update
-
-
- There is a special method of read/write locking called Read Copy
- Update. Using RCU, the readers can avoid taking a lock
- altogether: as we expect our cache to be read more often than
- updated (otherwise the cache is a waste of time), it is a
- candidate for this optimization.
-
-
-
- How do we get rid of read locks? Getting rid of read locks
- means that writers may be changing the list underneath the
- readers. That is actually quite simple: we can read a linked
- list while an element is being added if the writer adds the
- element very carefully. For example, adding
- <symbol>new</symbol> to a single linked list called
- <symbol>list</symbol>:
-
-
- <programlisting>
- new-&gt;next = list-&gt;next;
- wmb();
- list-&gt;next = new;
- </programlisting>
-
-
- The <function>wmb()</function> is a write memory barrier. It
- ensures that the first operation (setting the new element's
- <symbol>next</symbol> pointer) is complete and will be seen by
- all CPUs, before the second operation is (putting the new
- element into the list). This is important, since modern
- compilers and modern CPUs can both reorder instructions unless
- told otherwise: we want a reader to either not see the new
- element at all, or see the new element with the
- <symbol>next</symbol> pointer correctly pointing at the rest of
- the list.
-
-
- Fortunately, there is a function to do this for standard
- <structname>struct list_head</structname> lists:
- <function>list_add_rcu()</function>
- (<filename>include/linux/list.h</filename>).
-
-
- Removing an element from the list is even simpler: we replace
- the pointer to the old element with a pointer to its successor,
- and readers will either see it, or skip over it.
-
- <programlisting>
- list-&gt;next = old-&gt;next;
- </programlisting>
-
- There is <function>list_del_rcu()</function>
- (<filename>include/linux/list.h</filename>) which does this (the
- normal version poisons the old object, which we don't want).
-
-
- The reader must also be careful: some CPUs can look through the
- <symbol>next</symbol> pointer to start reading the contents of
- the next element early, but don't realize that the pre-fetched
- contents is wrong when the <symbol>next</symbol> pointer changes
- underneath them. Once again, there is a
- <function>list_for_each_entry_rcu()</function>
- (<filename>include/linux/list.h</filename>) to help you. Of
- course, writers can just use
- <function>list_for_each_entry()</function>, since there cannot
- be two simultaneous writers.
-
-
- Our final dilemma is this: when can we actually destroy the
- removed element? Remember, a reader might be stepping through
- this element in the list right now: if we free this element and
- the <symbol>next</symbol> pointer changes, the reader will jump
- off into garbage and crash. We need to wait until we know that
- all the readers who were traversing the list when we deleted the
- element are finished. We use <function>call_rcu()</function> to
- register a callback which will actually destroy the object once
- all pre-existing readers are finished. Alternatively,
- <function>synchronize_rcu()</function> may be used to block until
- all pre-existing are finished.
-
-
- But how does Read Copy Update know when the readers are
- finished? The method is this: firstly, the readers always
- traverse the list inside
- <function>rcu_read_lock()</function>/<function>rcu_read_unlock()</function>
- pairs: these simply disable preemption so the reader won't go to
- sleep while reading the list.
-
-
- RCU then waits until every other CPU has slept at least once:
- since readers cannot sleep, we know that any readers which were
- traversing the list during the deletion are finished, and the
- callback is triggered. The real Read Copy Update code is a
- little more optimized than this, but this is the fundamental
- idea.
-
-
-<programlisting>
---- cache.c.perobjectlock 2003-12-11 17:15:03.000000000 +1100
-+++ cache.c.rcupdate 2003-12-11 17:55:14.000000000 +1100
-@@ -1,15 +1,18 @@
- #include &lt;linux/list.h&gt;
- #include &lt;linux/slab.h&gt;
- #include &lt;linux/string.h&gt;
-+#include &lt;linux/rcupdate.h&gt;
- #include &lt;linux/mutex.h&gt;
- #include &lt;asm/errno.h&gt;
-
- struct object
- {
-- /* These two protected by cache_lock. */
-+ /* This is protected by RCU */
- struct list_head list;
- int popularity;
-
-+ struct rcu_head rcu;
-+
- atomic_t refcnt;
-
- /* Doesn't change once created. */
-@@ -40,7 +43,7 @@
- {
- struct object *i;
-
-- list_for_each_entry(i, &amp;cache, list) {
-+ list_for_each_entry_rcu(i, &amp;cache, list) {
- if (i-&gt;id == id) {
- i-&gt;popularity++;
- return i;
-@@ -49,19 +52,25 @@
- return NULL;
- }
-
-+/* Final discard done once we know no readers are looking. */
-+static void cache_delete_rcu(void *arg)
-+{
-+ object_put(arg);
-+}
-+
- /* Must be holding cache_lock */
- static void __cache_delete(struct object *obj)
- {
- BUG_ON(!obj);
-- list_del(&amp;obj-&gt;list);
-- object_put(obj);
-+ list_del_rcu(&amp;obj-&gt;list);
- cache_num--;
-+ call_rcu(&amp;obj-&gt;rcu, cache_delete_rcu);
- }
-
- /* Must be holding cache_lock */
- static void __cache_add(struct object *obj)
- {
-- list_add(&amp;obj-&gt;list, &amp;cache);
-+ list_add_rcu(&amp;obj-&gt;list, &amp;cache);
- if (++cache_num > MAX_CACHE_SIZE) {
- struct object *i, *outcast = NULL;
- list_for_each_entry(i, &amp;cache, list) {
-@@ -104,12 +114,11 @@
- struct object *cache_find(int id)
- {
- struct object *obj;
-- unsigned long flags;
-
-- spin_lock_irqsave(&amp;cache_lock, flags);
-+ rcu_read_lock();
- obj = __cache_find(id);
- if (obj)
- object_get(obj);
-- spin_unlock_irqrestore(&amp;cache_lock, flags);
-+ rcu_read_unlock();
- return obj;
- }
-</programlisting>
-
-
-Note that the reader will alter the
-<structfield>popularity</structfield> member in
-<function>__cache_find()</function>, and now it doesn't hold a lock.
-One solution would be to make it an <type>atomic_t</type>, but for
-this usage, we don't really care about races: an approximate result is
-good enough, so I didn't change it.
-
-
-
-The result is that <function>cache_find()</function> requires no
-synchronization with any other functions, so is almost as fast on SMP
-as it would be on UP.
-
-
-
-There is a further optimization possible here: remember our original
-cache code, where there were no reference counts and the caller simply
-held the lock whenever using the object? This is still possible: if
-you hold the lock, no one can delete the object, so you don't need to
-get and put the reference count.
-
-
-
-Now, because the 'read lock' in RCU is simply disabling preemption, a
-caller which always has preemption disabled between calling
-<function>cache_find()</function> and
-<function>object_put()</function> does not need to actually get and
-put the reference count: we could expose
-<function>__cache_find()</function> by making it non-static, and
-such callers could simply call that.
-
-
-The benefit here is that the reference count is not written to: the
-object is not altered in any way, which is much faster on SMP
-machines due to caching.
-
- </sect1>
-
- <sect1 id="per-cpu">
- Per-CPU Data
-
-
- Another technique for avoiding locking which is used fairly
- widely is to duplicate information for each CPU. For example,
- if you wanted to keep a count of a common condition, you could
- use a spin lock and a single counter. Nice and simple.
-
-
-
- If that was too slow (it's usually not, but if you've got a
- really big machine to test on and can show that it is), you
- could instead use a counter for each CPU, then none of them need
- an exclusive lock. See <function>DEFINE_PER_CPU()</function>,
- <function>get_cpu_var()</function> and
- <function>put_cpu_var()</function>
- (<filename class="headerfile">include/linux/percpu.h</filename>).
-
-
-
- Of particular use for simple per-cpu counters is the
- <type>local_t</type> type, and the
- <function>cpu_local_inc()</function> and related functions,
- which are more efficient than simple code on some architectures
- (<filename class="headerfile">include/asm/local.h</filename>).
-
-
-
- Note that there is no simple, reliable way of getting an exact
- value of such a counter, without introducing more locks. This
- is not a problem for some uses.
-
- </sect1>
-
- <sect1 id="mostly-hardirq">
- Data Which Mostly Used By An IRQ Handler
-
-
- If data is always accessed from within the same IRQ handler, you
- don't need a lock at all: the kernel already guarantees that the
- irq handler will not run simultaneously on multiple CPUs.
-
-
- Manfred Spraul points out that you can still do this, even if
- the data is very occasionally accessed in user context or
- softirqs/tasklets. The irq handler doesn't use a lock, and
- all other accesses are done as so:
-
-
-<programlisting>
- spin_lock(&amp;lock);
- disable_irq(irq);
- ...
- enable_irq(irq);
- spin_unlock(&amp;lock);
-</programlisting>
-
- The <function>disable_irq()</function> prevents the irq handler
- from running (and waits for it to finish if it's currently
- running on other CPUs). The spinlock prevents any other
- accesses happening at the same time. Naturally, this is slower
- than just a <function>spin_lock_irq()</function> call, so it
- only makes sense if this type of access happens extremely
- rarely.
-
- </sect1>
- </chapter>
-
- <chapter id="sleeping-things">
- What Functions Are Safe To Call From Interrupts?
-
-
- Many functions in the kernel sleep (ie. call schedule())
- directly or indirectly: you can never call them while holding a
- spinlock, or with preemption disabled. This also means you need
- to be in user context: calling them from an interrupt is illegal.
-
-
- <sect1 id="sleeping">
- Some Functions Which Sleep
-
-
- The most common ones are listed below, but you usually have to
- read the code to find out if other calls are safe. If everyone
- else who calls it can sleep, you probably need to be able to
- sleep, too. In particular, registration and deregistration
- functions usually expect to be called from user context, and can
- sleep.
-
-
-
-
-
- Accesses to
- <firstterm linkend="gloss-userspace">userspace</firstterm>:
-
-
-
-
- <function>copy_from_user()</function>
-
-
-
-
- <function>copy_to_user()</function>
-
-
-
-
- <function>get_user()</function>
-
-
-
-
- <function>put_user()</function>
-
-
-
-
-
-
-
- <function>kmalloc(GFP_KERNEL)</function>
-
-
-
-
-
- <function>mutex_lock_interruptible()</function> and
- <function>mutex_lock()</function>
-
-
- There is a <function>mutex_trylock()</function> which does not
- sleep. Still, it must not be used inside interrupt context since
- its implementation is not safe for that.
- <function>mutex_unlock()</function> will also never sleep.
- It cannot be used in interrupt context either since a mutex
- must be released by the same task that acquired it.
-
-
-
- </sect1>
-
- <sect1 id="dont-sleep">
- Some Functions Which Don't Sleep
-
-
- Some functions are safe to call from any context, or holding
- almost any lock.
-
-
-
-
-
- <function>printk()</function>
-
-
-
-
- <function>kfree()</function>
-
-
-
-
- <function>add_timer()</function> and <function>del_timer()</function>
-
-
-
- </sect1>
- </chapter>
-
- <chapter id="apiref-mutex">
- Mutex API reference
-!Iinclude/linux/mutex.h
-!Ekernel/locking/mutex.c
- </chapter>
-
- <chapter id="apiref-futex">
- Futex API reference
-!Ikernel/futex.c
- </chapter>
-
- <chapter id="references">
- Further reading
-
-
-
-
- <filename>Documentation/locking/spinlocks.txt</filename>:
- Linus Torvalds' spinlocking tutorial in the kernel sources.
-
-
-
-
-
- Unix Systems for Modern Architectures: Symmetric
- Multiprocessing and Caching for Kernel Programmers:
-
-
-
- Curt Schimmel's very good introduction to kernel level
- locking (not written for Linux, but nearly everything
- applies). The book is expensive, but really worth every
- penny to understand SMP locking. [ISBN: 0201633388]
-
-
-
- </chapter>
-
- <chapter id="thanks">
- Thanks
-
-
- Thanks to Telsa Gwynne for DocBooking, neatening and adding
- style.
-
-
-
- Thanks to Martin Pool, Philipp Rumpf, Stephen Rothwell, Paul
- Mackerras, Ruedi Aschwanden, Alan Cox, Manfred Spraul, Tim
- Waugh, Pete Zaitcev, James Morris, Robert Love, Paul McKenney,
- John Ashby for proofreading, correcting, flaming, commenting.
-
-
-
- Thanks to the cabal for having no influence on this document.
-
- </chapter>
-
- <glossary id="glossary">
- Glossary
-
- <glossentry id="gloss-preemption">
- <glossterm>preemption</glossterm>
- <glossdef>
-
- Prior to 2.5, or when <symbol>CONFIG_PREEMPT</symbol> is
- unset, processes in user context inside the kernel would not
- preempt each other (ie. you had that CPU until you gave it up,
- except for interrupts). With the addition of
- <symbol>CONFIG_PREEMPT</symbol> in 2.5.4, this changed: when
- in user context, higher priority tasks can "cut in": spinlocks
- were changed to disable preemption, even on UP.
-
- </glossdef>
- </glossentry>
-
- <glossentry id="gloss-bh">
- <glossterm>bh</glossterm>
- <glossdef>
-
- Bottom Half: for historical reasons, functions with
- '_bh' in them often now refer to any software interrupt, e.g.
- <function>spin_lock_bh()</function> blocks any software interrupt
- on the current CPU. Bottom halves are deprecated, and will
- eventually be replaced by tasklets. Only one bottom half will be
- running at any time.
-
- </glossdef>
- </glossentry>
-
- <glossentry id="gloss-hwinterrupt">
- <glossterm>Hardware Interrupt / Hardware IRQ</glossterm>
- <glossdef>
-
- Hardware interrupt request. <function>in_irq()</function> returns
- <returnvalue>true</returnvalue> in a hardware interrupt handler.
-
- </glossdef>
- </glossentry>
-
- <glossentry id="gloss-interruptcontext">
- <glossterm>Interrupt Context</glossterm>
- <glossdef>
-
- Not user context: processing a hardware irq or software irq.
- Indicated by the <function>in_interrupt()</function> macro
- returning <returnvalue>true</returnvalue>.
-
- </glossdef>
- </glossentry>
-
- <glossentry id="gloss-smp">
- <glossterm> SMP </glossterm>
- <glossdef>
-
- Symmetric Multi-Processor: kernels compiled for multiple-CPU
- machines. (CONFIG_SMP=y).
-
- </glossdef>
- </glossentry>
-
- <glossentry id="gloss-softirq">
- <glossterm>Software Interrupt / softirq</glossterm>
- <glossdef>
-
- Software interrupt handler. <function>in_irq()</function> returns
- <returnvalue>false</returnvalue>; <function>in_softirq()</function>
- returns <returnvalue>true</returnvalue>. Tasklets and softirqs
- both fall into the category of 'software interrupts'.
-
-
- Strictly speaking a softirq is one of up to 32 enumerated software
- interrupts which can run on multiple CPUs at once.
- Sometimes used to refer to tasklets as
- well (ie. all software interrupts).
-
- </glossdef>
- </glossentry>
-
- <glossentry id="gloss-tasklet">
- <glossterm>tasklet</glossterm>
- <glossdef>
-
- A dynamically-registrable software interrupt,
- which is guaranteed to only run on one CPU at a time.
-
- </glossdef>
- </glossentry>
-
- <glossentry id="gloss-timers">
- <glossterm>timer</glossterm>
- <glossdef>
-
- A dynamically-registrable software interrupt, which is run at
- (or close to) a given time. When running, it is just like a
- tasklet (in fact, they are called from the TIMER_SOFTIRQ).
-
- </glossdef>
- </glossentry>
-
- <glossentry id="gloss-up">
- <glossterm> UP </glossterm>
- <glossdef>
-
- Uni-Processor: Non-SMP. (CONFIG_SMP=n).
-
- </glossdef>
- </glossentry>
-
- <glossentry id="gloss-usercontext">
- <glossterm>User Context</glossterm>
- <glossdef>
-
- The kernel executing on behalf of a particular process (ie. a
- system call or trap) or kernel thread. You can tell which
- process with the <symbol>current</symbol> macro.) Not to
- be confused with userspace. Can be interrupted by software or
- hardware interrupts.
-
- </glossdef>
- </glossentry>
-
- <glossentry id="gloss-userspace">
- <glossterm>Userspace</glossterm>
- <glossdef>
-
- A process executing its own code outside the kernel.
-
- </glossdef>
- </glossentry>
-
- </glossary>
-</book>
-
diff --git a/Documentation/kernel-hacking/index.rst b/Documentation/kernel-hacking/index.rst
index ba208bf03ce9..fcb0eda3cca3 100644
--- a/Documentation/kernel-hacking/index.rst
+++ b/Documentation/kernel-hacking/index.rst
@@ -6,3 +6,4 @@ Kernel Hacking Guides
:maxdepth: 2

hacking
+ locking
diff --git a/Documentation/kernel-hacking/locking.rst b/Documentation/kernel-hacking/locking.rst
new file mode 100644
index 000000000000..976b2703df75
--- /dev/null
+++ b/Documentation/kernel-hacking/locking.rst
@@ -0,0 +1,1453 @@
+===========================
+Unreliable Guide To Locking
+===========================
+
+:Author: Rusty Russell
+
+Introduction
+============
+
+Welcome, to Rusty's Remarkably Unreliable Guide to Kernel Locking
+issues. This document describes the locking systems in the Linux Kernel
+in 2.6.
+
+With the wide availability of HyperThreading, and preemption in the
+Linux Kernel, everyone hacking on the kernel needs to know the
+fundamentals of concurrency and locking for SMP.
+
+The Problem With Concurrency
+============================
+
+(Skip this if you know what a Race Condition is).
+
+In a normal program, you can increment a counter like so:
+
+::
+
+ very_important_count++;
+
+
+This is what they would expect to happen:
+
++------------------------------------+------------------------------------+
+| Instance 1 | Instance 2 |
++====================================+====================================+
+| read very_important_count (5) | |
++------------------------------------+------------------------------------+
+| add 1 (6) | |
++------------------------------------+------------------------------------+
+| write very_important_count (6) | |
++------------------------------------+------------------------------------+
+| | read very_important_count (6) |
++------------------------------------+------------------------------------+
+| | add 1 (7) |
++------------------------------------+------------------------------------+
+| | write very_important_count (7) |
++------------------------------------+------------------------------------+
+
+Table: Expected Results
+
+This is what might happen:
+
++------------------------------------+------------------------------------+
+| Instance 1 | Instance 2 |
++====================================+====================================+
+| read very_important_count (5) | |
++------------------------------------+------------------------------------+
+| | read very_important_count (5) |
++------------------------------------+------------------------------------+
+| add 1 (6) | |
++------------------------------------+------------------------------------+
+| | add 1 (6) |
++------------------------------------+------------------------------------+
+| write very_important_count (6) | |
++------------------------------------+------------------------------------+
+| | write very_important_count (6) |
++------------------------------------+------------------------------------+
+
+Table: Possible Results
+
+Race Conditions and Critical Regions
+------------------------------------
+
+This overlap, where the result depends on the relative timing of
+multiple tasks, is called a race condition. The piece of code containing
+the concurrency issue is called a critical region. And especially since
+Linux starting running on SMP machines, they became one of the major
+issues in kernel design and implementation.
+
+Preemption can have the same effect, even if there is only one CPU: by
+preempting one task during the critical region, we have exactly the same
+race condition. In this case the thread which preempts might run the
+critical region itself.
+
+The solution is to recognize when these simultaneous accesses occur, and
+use locks to make sure that only one instance can enter the critical
+region at any time. There are many friendly primitives in the Linux
+kernel to help you do this. And then there are the unfriendly
+primitives, but I'll pretend they don't exist.
+
+Locking in the Linux Kernel
+===========================
+
+If I could give you one piece of advice: never sleep with anyone crazier
+than yourself. But if I had to give you advice on locking: *keep it
+simple*.
+
+Be reluctant to introduce new locks.
+
+Strangely enough, this last one is the exact reverse of my advice when
+you *have* slept with someone crazier than yourself. And you should
+think about getting a big dog.
+
+Two Main Types of Kernel Locks: Spinlocks and Mutexes
+-----------------------------------------------------
+
+There are two main types of kernel locks. The fundamental type is the
+spinlock (``include/asm/spinlock.h``), which is a very simple
+single-holder lock: if you can't get the spinlock, you keep trying
+(spinning) until you can. Spinlocks are very small and fast, and can be
+used anywhere.
+
+The second type is a mutex (``include/linux/mutex.h``): it is like a
+spinlock, but you may block holding a mutex. If you can't lock a mutex,
+your task will suspend itself, and be woken up when the mutex is
+released. This means the CPU can do something else while you are
+waiting. There are many cases when you simply can't sleep (see
+`What Functions Are Safe To Call From Interrupts? <#sleeping-things>`__),
+and so have to use a spinlock instead.
+
+Neither type of lock is recursive: see
+`Deadlock: Simple and Advanced <#deadlock>`__.
+
+Locks and Uniprocessor Kernels
+------------------------------
+
+For kernels compiled without ``CONFIG_SMP``, and without
+``CONFIG_PREEMPT`` spinlocks do not exist at all. This is an excellent
+design decision: when no-one else can run at the same time, there is no
+reason to have a lock.
+
+If the kernel is compiled without ``CONFIG_SMP``, but ``CONFIG_PREEMPT``
+is set, then spinlocks simply disable preemption, which is sufficient to
+prevent any races. For most purposes, we can think of preemption as
+equivalent to SMP, and not worry about it separately.
+
+You should always test your locking code with ``CONFIG_SMP`` and
+``CONFIG_PREEMPT`` enabled, even if you don't have an SMP test box,
+because it will still catch some kinds of locking bugs.
+
+Mutexes still exist, because they are required for synchronization
+between user contexts, as we will see below.
+
+Locking Only In User Context
+----------------------------
+
+If you have a data structure which is only ever accessed from user
+context, then you can use a simple mutex (``include/linux/mutex.h``) to
+protect it. This is the most trivial case: you initialize the mutex.
+Then you can call :c:func:`mutex_lock_interruptible()` to grab the
+mutex, and :c:func:`mutex_unlock()` to release it. There is also a
+:c:func:`mutex_lock()`, which should be avoided, because it will
+not return if a signal is received.
+
+Example: ``net/netfilter/nf_sockopt.c`` allows registration of new
+:c:func:`setsockopt()` and :c:func:`getsockopt()` calls, with
+:c:func:`nf_register_sockopt()`. Registration and de-registration
+are only done on module load and unload (and boot time, where there is
+no concurrency), and the list of registrations is only consulted for an
+unknown :c:func:`setsockopt()` or :c:func:`getsockopt()` system
+call. The ``nf_sockopt_mutex`` is perfect to protect this, especially
+since the setsockopt and getsockopt calls may well sleep.
+
+Locking Between User Context and Softirqs
+-----------------------------------------
+
+If a softirq shares data with user context, you have two problems.
+Firstly, the current user context can be interrupted by a softirq, and
+secondly, the critical region could be entered from another CPU. This is
+where :c:func:`spin_lock_bh()` (``include/linux/spinlock.h``) is
+used. It disables softirqs on that CPU, then grabs the lock.
+:c:func:`spin_unlock_bh()` does the reverse. (The '_bh' suffix is
+a historical reference to "Bottom Halves", the old name for software
+interrupts. It should really be called spin_lock_softirq()' in a
+perfect world).
+
+Note that you can also use :c:func:`spin_lock_irq()` or
+:c:func:`spin_lock_irqsave()` here, which stop hardware interrupts
+as well: see `Hard IRQ Context <#hardirq-context>`__.
+
+This works perfectly for UP as well: the spin lock vanishes, and this
+macro simply becomes :c:func:`local_bh_disable()`
+(``include/linux/interrupt.h``), which protects you from the softirq
+being run.
+
+Locking Between User Context and Tasklets
+-----------------------------------------
+
+This is exactly the same as above, because tasklets are actually run
+from a softirq.
+
+Locking Between User Context and Timers
+---------------------------------------
+
+This, too, is exactly the same as above, because timers are actually run
+from a softirq. From a locking point of view, tasklets and timers are
+identical.
+
+Locking Between Tasklets/Timers
+-------------------------------
+
+Sometimes a tasklet or timer might want to share data with another
+tasklet or timer.
+
+The Same Tasklet/Timer
+~~~~~~~~~~~~~~~~~~~~~~
+
+Since a tasklet is never run on two CPUs at once, you don't need to
+worry about your tasklet being reentrant (running twice at once), even
+on SMP.
+
+Different Tasklets/Timers
+~~~~~~~~~~~~~~~~~~~~~~~~~
+
+If another tasklet/timer wants to share data with your tasklet or timer
+, you will both need to use :c:func:`spin_lock()` and
+:c:func:`spin_unlock()` calls. :c:func:`spin_lock_bh()` is
+unnecessary here, as you are already in a tasklet, and none will be run
+on the same CPU.
+
+Locking Between Softirqs
+------------------------
+
+Often a softirq might want to share data with itself or a tasklet/timer.
+
+The Same Softirq
+~~~~~~~~~~~~~~~~
+
+The same softirq can run on the other CPUs: you can use a per-CPU array
+(see `Per-CPU Data <#per-cpu>`__) for better performance. If you're
+going so far as to use a softirq, you probably care about scalable
+performance enough to justify the extra complexity.
+
+You'll need to use :c:func:`spin_lock()` and
+:c:func:`spin_unlock()` for shared data.
+
+Different Softirqs
+~~~~~~~~~~~~~~~~~~
+
+You'll need to use :c:func:`spin_lock()` and
+:c:func:`spin_unlock()` for shared data, whether it be a timer,
+tasklet, different softirq or the same or another softirq: any of them
+could be running on a different CPU.
+
+Hard IRQ Context
+================
+
+Hardware interrupts usually communicate with a tasklet or softirq.
+Frequently this involves putting work in a queue, which the softirq will
+take out.
+
+Locking Between Hard IRQ and Softirqs/Tasklets
+----------------------------------------------
+
+If a hardware irq handler shares data with a softirq, you have two
+concerns. Firstly, the softirq processing can be interrupted by a
+hardware interrupt, and secondly, the critical region could be entered
+by a hardware interrupt on another CPU. This is where
+:c:func:`spin_lock_irq()` is used. It is defined to disable
+interrupts on that cpu, then grab the lock.
+:c:func:`spin_unlock_irq()` does the reverse.
+
+The irq handler does not to use :c:func:`spin_lock_irq()`, because
+the softirq cannot run while the irq handler is running: it can use
+:c:func:`spin_lock()`, which is slightly faster. The only exception
+would be if a different hardware irq handler uses the same lock:
+:c:func:`spin_lock_irq()` will stop that from interrupting us.
+
+This works perfectly for UP as well: the spin lock vanishes, and this
+macro simply becomes :c:func:`local_irq_disable()`
+(``include/asm/smp.h``), which protects you from the softirq/tasklet/BH
+being run.
+
+:c:func:`spin_lock_irqsave()` (``include/linux/spinlock.h``) is a
+variant which saves whether interrupts were on or off in a flags word,
+which is passed to :c:func:`spin_unlock_irqrestore()`. This means
+that the same code can be used inside an hard irq handler (where
+interrupts are already off) and in softirqs (where the irq disabling is
+required).
+
+Note that softirqs (and hence tasklets and timers) are run on return
+from hardware interrupts, so :c:func:`spin_lock_irq()` also stops
+these. In that sense, :c:func:`spin_lock_irqsave()` is the most
+general and powerful locking function.
+
+Locking Between Two Hard IRQ Handlers
+-------------------------------------
+
+It is rare to have to share data between two IRQ handlers, but if you
+do, :c:func:`spin_lock_irqsave()` should be used: it is
+architecture-specific whether all interrupts are disabled inside irq
+handlers themselves.
+
+Cheat Sheet For Locking
+=======================
+
+Pete Zaitcev gives the following summary:
+
+- If you are in a process context (any syscall) and want to lock other
+ process out, use a mutex. You can take a mutex and sleep
+ (``copy_from_user*(`` or ``kmalloc(x,GFP_KERNEL)``).
+
+- Otherwise (== data can be touched in an interrupt), use
+ :c:func:`spin_lock_irqsave()` and
+ :c:func:`spin_unlock_irqrestore()`.
+
+- Avoid holding spinlock for more than 5 lines of code and across any
+ function call (except accessors like :c:func:`readb()`).
+
+Table of Minimum Requirements
+-----------------------------
+
+The following table lists the *minimum* locking requirements between
+various contexts. In some cases, the same context can only be running on
+one CPU at a time, so no locking is required for that context (eg. a
+particular thread can only run on one CPU at a time, but if it needs
+shares data with another thread, locking is required).
+
+Remember the advice above: you can always use
+:c:func:`spin_lock_irqsave()`, which is a superset of all other
+spinlock primitives.
+
++------------------+-----------------+-----------------+-------------+-------------+-------------+-------------+-----------+-----------+------------------+------------------+
+| | IRQ Handler A | IRQ Handler B | Softirq A | Softirq B | Tasklet A | Tasklet B | Timer A | Timer B | User Context A | User Context B |
++------------------+-----------------+-----------------+-------------+-------------+-------------+-------------+-----------+-----------+------------------+------------------+
+| IRQ Handler A | None | | | | | | | | | |
++------------------+-----------------+-----------------+-------------+-------------+-------------+-------------+-----------+-----------+------------------+------------------+
+| IRQ Handler B | SLIS | None | | | | | | | | |
++------------------+-----------------+-----------------+-------------+-------------+-------------+-------------+-----------+-----------+------------------+------------------+
+| Softirq A | SLI | SLI | SL | | | | | | | |
++------------------+-----------------+-----------------+-------------+-------------+-------------+-------------+-----------+-----------+------------------+------------------+
+| Softirq B | SLI | SLI | SL | SL | | | | | | |
++------------------+-----------------+-----------------+-------------+-------------+-------------+-------------+-----------+-----------+------------------+------------------+
+| Tasklet A | SLI | SLI | SL | SL | None | | | | | |
++------------------+-----------------+-----------------+-------------+-------------+-------------+-------------+-----------+-----------+------------------+------------------+
+| Tasklet B | SLI | SLI | SL | SL | SL | None | | | | |
++------------------+-----------------+-----------------+-------------+-------------+-------------+-------------+-----------+-----------+------------------+------------------+
+| Timer A | SLI | SLI | SL | SL | SL | SL | None | | | |
++------------------+-----------------+-----------------+-------------+-------------+-------------+-------------+-----------+-----------+------------------+------------------+
+| Timer B | SLI | SLI | SL | SL | SL | SL | SL | None | | |
++------------------+-----------------+-----------------+-------------+-------------+-------------+-------------+-----------+-----------+------------------+------------------+
+| User Context A | SLI | SLI | SLBH | SLBH | SLBH | SLBH | SLBH | SLBH | None | |
++------------------+-----------------+-----------------+-------------+-------------+-------------+-------------+-----------+-----------+------------------+------------------+
+| User Context B | SLI | SLI | SLBH | SLBH | SLBH | SLBH | SLBH | SLBH | MLI | None |
++------------------+-----------------+-----------------+-------------+-------------+-------------+-------------+-----------+-----------+------------------+------------------+
+
+Table: Table of Locking Requirements
+
++--------+----------------------------+
+| SLIS | spin_lock_irqsave |
++--------+----------------------------+
+| SLI | spin_lock_irq |
++--------+----------------------------+
+| SL | spin_lock |
++--------+----------------------------+
+| SLBH | spin_lock_bh |
++--------+----------------------------+
+| MLI | mutex_lock_interruptible |
++--------+----------------------------+
+
+Table: Legend for Locking Requirements Table
+
+The trylock Functions
+=====================
+
+There are functions that try to acquire a lock only once and immediately
+return a value telling about success or failure to acquire the lock.
+They can be used if you need no access to the data protected with the
+lock when some other thread is holding the lock. You should acquire the
+lock later if you then need access to the data protected with the lock.
+
+:c:func:`spin_trylock()` does not spin but returns non-zero if it
+acquires the spinlock on the first try or 0 if not. This function can be
+used in all contexts like :c:func:`spin_lock()`: you must have
+disabled the contexts that might interrupt you and acquire the spin
+lock.
+
+:c:func:`mutex_trylock()` does not suspend your task but returns
+non-zero if it could lock the mutex on the first try or 0 if not. This
+function cannot be safely used in hardware or software interrupt
+contexts despite not sleeping.
+
+Common Examples
+===============
+
+Let's step through a simple example: a cache of number to name mappings.
+The cache keeps a count of how often each of the objects is used, and
+when it gets full, throws out the least used one.
+
+All In User Context
+-------------------
+
+For our first example, we assume that all operations are in user context
+(ie. from system calls), so we can sleep. This means we can use a mutex
+to protect the cache and all the objects within it. Here's the code::
+
+ #include <linux/list.h>
+ #include <linux/slab.h>
+ #include <linux/string.h>
+ #include <linux/mutex.h>
+ #include <asm/errno.h>
+
+ struct object
+ {
+ struct list_head list;
+ int id;
+ char name[32];
+ int popularity;
+ };
+
+ /* Protects the cache, cache_num, and the objects within it */
+ static DEFINE_MUTEX(cache_lock);
+ static LIST_HEAD(cache);
+ static unsigned int cache_num = 0;
+ #define MAX_CACHE_SIZE 10
+
+ /* Must be holding cache_lock */
+ static struct object *__cache_find(int id)
+ {
+ struct object *i;
+
+ list_for_each_entry(i, &cache, list)
+ if (i->id == id) {
+ i->popularity++;
+ return i;
+ }
+ return NULL;
+ }
+
+ /* Must be holding cache_lock */
+ static void __cache_delete(struct object *obj)
+ {
+ BUG_ON(!obj);
+ list_del(&obj->list);
+ kfree(obj);
+ cache_num--;
+ }
+
+ /* Must be holding cache_lock */
+ static void __cache_add(struct object *obj)
+ {
+ list_add(&obj->list, &cache);
+ if (++cache_num > MAX_CACHE_SIZE) {
+ struct object *i, *outcast = NULL;
+ list_for_each_entry(i, &cache, list) {
+ if (!outcast || i->popularity < outcast->popularity)
+ outcast = i;
+ }
+ __cache_delete(outcast);
+ }
+ }
+
+ int cache_add(int id, const char *name)
+ {
+ struct object *obj;
+
+ if ((obj = kmalloc(sizeof(*obj), GFP_KERNEL)) == NULL)
+ return -ENOMEM;
+
+ strlcpy(obj->name, name, sizeof(obj->name));
+ obj->id = id;
+ obj->popularity = 0;
+
+ mutex_lock(&cache_lock);
+ __cache_add(obj);
+ mutex_unlock(&cache_lock);
+ return 0;
+ }
+
+ void cache_delete(int id)
+ {
+ mutex_lock(&cache_lock);
+ __cache_delete(__cache_find(id));
+ mutex_unlock(&cache_lock);
+ }
+
+ int cache_find(int id, char *name)
+ {
+ struct object *obj;
+ int ret = -ENOENT;
+
+ mutex_lock(&cache_lock);
+ obj = __cache_find(id);
+ if (obj) {
+ ret = 0;
+ strcpy(name, obj->name);
+ }
+ mutex_unlock(&cache_lock);
+ return ret;
+ }
+
+Note that we always make sure we have the cache_lock when we add,
+delete, or look up the cache: both the cache infrastructure itself and
+the contents of the objects are protected by the lock. In this case it's
+easy, since we copy the data for the user, and never let them access the
+objects directly.
+
+There is a slight (and common) optimization here: in
+:c:func:`cache_add()` we set up the fields of the object before
+grabbing the lock. This is safe, as no-one else can access it until we
+put it in cache.
+
+Accessing From Interrupt Context
+--------------------------------
+
+Now consider the case where :c:func:`cache_find()` can be called
+from interrupt context: either a hardware interrupt or a softirq. An
+example would be a timer which deletes object from the cache.
+
+The change is shown below, in standard patch format: the ``-`` are lines
+which are taken away, and the ``+`` are lines which are added.
+
+::
+
+ --- cache.c.usercontext 2003-12-09 13:58:54.000000000 +1100
+ +++ cache.c.interrupt 2003-12-09 14:07:49.000000000 +1100
+ @@ -12,7 +12,7 @@
+ int popularity;
+ };
+
+ -static DEFINE_MUTEX(cache_lock);
+ +static DEFINE_SPINLOCK(cache_lock);
+ static LIST_HEAD(cache);
+ static unsigned int cache_num = 0;
+ #define MAX_CACHE_SIZE 10
+ @@ -55,6 +55,7 @@
+ int cache_add(int id, const char *name)
+ {
+ struct object *obj;
+ + unsigned long flags;
+
+ if ((obj = kmalloc(sizeof(*obj), GFP_KERNEL)) == NULL)
+ return -ENOMEM;
+ @@ -63,30 +64,33 @@
+ obj->id = id;
+ obj->popularity = 0;
+
+ - mutex_lock(&cache_lock);
+ + spin_lock_irqsave(&cache_lock, flags);
+ __cache_add(obj);
+ - mutex_unlock(&cache_lock);
+ + spin_unlock_irqrestore(&cache_lock, flags);
+ return 0;
+ }
+
+ void cache_delete(int id)
+ {
+ - mutex_lock(&cache_lock);
+ + unsigned long flags;
+ +
+ + spin_lock_irqsave(&cache_lock, flags);
+ __cache_delete(__cache_find(id));
+ - mutex_unlock(&cache_lock);
+ + spin_unlock_irqrestore(&cache_lock, flags);
+ }
+
+ int cache_find(int id, char *name)
+ {
+ struct object *obj;
+ int ret = -ENOENT;
+ + unsigned long flags;
+
+ - mutex_lock(&cache_lock);
+ + spin_lock_irqsave(&cache_lock, flags);
+ obj = __cache_find(id);
+ if (obj) {
+ ret = 0;
+ strcpy(name, obj->name);
+ }
+ - mutex_unlock(&cache_lock);
+ + spin_unlock_irqrestore(&cache_lock, flags);
+ return ret;
+ }
+
+Note that the :c:func:`spin_lock_irqsave()` will turn off
+interrupts if they are on, otherwise does nothing (if we are already in
+an interrupt handler), hence these functions are safe to call from any
+context.
+
+Unfortunately, :c:func:`cache_add()` calls :c:func:`kmalloc()`
+with the ``GFP_KERNEL`` flag, which is only legal in user context. I
+have assumed that :c:func:`cache_add()` is still only called in
+user context, otherwise this should become a parameter to
+:c:func:`cache_add()`.
+
+Exposing Objects Outside This File
+----------------------------------
+
+If our objects contained more information, it might not be sufficient to
+copy the information in and out: other parts of the code might want to
+keep pointers to these objects, for example, rather than looking up the
+id every time. This produces two problems.
+
+The first problem is that we use the ``cache_lock`` to protect objects:
+we'd need to make this non-static so the rest of the code can use it.
+This makes locking trickier, as it is no longer all in one place.
+
+The second problem is the lifetime problem: if another structure keeps a
+pointer to an object, it presumably expects that pointer to remain
+valid. Unfortunately, this is only guaranteed while you hold the lock,
+otherwise someone might call :c:func:`cache_delete()` and even
+worse, add another object, re-using the same address.
+
+As there is only one lock, you can't hold it forever: no-one else would
+get any work done.
+
+The solution to this problem is to use a reference count: everyone who
+has a pointer to the object increases it when they first get the object,
+and drops the reference count when they're finished with it. Whoever
+drops it to zero knows it is unused, and can actually delete it.
+
+Here is the code::
+
+ --- cache.c.interrupt 2003-12-09 14:25:43.000000000 +1100
+ +++ cache.c.refcnt 2003-12-09 14:33:05.000000000 +1100
+ @@ -7,6 +7,7 @@
+ struct object
+ {
+ struct list_head list;
+ + unsigned int refcnt;
+ int id;
+ char name[32];
+ int popularity;
+ @@ -17,6 +18,35 @@
+ static unsigned int cache_num = 0;
+ #define MAX_CACHE_SIZE 10
+
+ +static void __object_put(struct object *obj)
+ +{
+ + if (--obj->refcnt == 0)
+ + kfree(obj);
+ +}
+ +
+ +static void __object_get(struct object *obj)
+ +{
+ + obj->refcnt++;
+ +}
+ +
+ +void object_put(struct object *obj)
+ +{
+ + unsigned long flags;
+ +
+ + spin_lock_irqsave(&cache_lock, flags);
+ + __object_put(obj);
+ + spin_unlock_irqrestore(&cache_lock, flags);
+ +}
+ +
+ +void object_get(struct object *obj)
+ +{
+ + unsigned long flags;
+ +
+ + spin_lock_irqsave(&cache_lock, flags);
+ + __object_get(obj);
+ + spin_unlock_irqrestore(&cache_lock, flags);
+ +}
+ +
+ /* Must be holding cache_lock */
+ static struct object *__cache_find(int id)
+ {
+ @@ -35,6 +65,7 @@
+ {
+ BUG_ON(!obj);
+ list_del(&obj->list);
+ + __object_put(obj);
+ cache_num--;
+ }
+
+ @@ -63,6 +94,7 @@
+ strlcpy(obj->name, name, sizeof(obj->name));
+ obj->id = id;
+ obj->popularity = 0;
+ + obj->refcnt = 1; /* The cache holds a reference */
+
+ spin_lock_irqsave(&cache_lock, flags);
+ __cache_add(obj);
+ @@ -79,18 +111,15 @@
+ spin_unlock_irqrestore(&cache_lock, flags);
+ }
+
+ -int cache_find(int id, char *name)
+ +struct object *cache_find(int id)
+ {
+ struct object *obj;
+ - int ret = -ENOENT;
+ unsigned long flags;
+
+ spin_lock_irqsave(&cache_lock, flags);
+ obj = __cache_find(id);
+ - if (obj) {
+ - ret = 0;
+ - strcpy(name, obj->name);
+ - }
+ + if (obj)
+ + __object_get(obj);
+ spin_unlock_irqrestore(&cache_lock, flags);
+ - return ret;
+ + return obj;
+ }
+
+We encapsulate the reference counting in the standard 'get' and 'put'
+functions. Now we can return the object itself from
+:c:func:`cache_find()` which has the advantage that the user can
+now sleep holding the object (eg. to :c:func:`copy_to_user()` to
+name to userspace).
+
+The other point to note is that I said a reference should be held for
+every pointer to the object: thus the reference count is 1 when first
+inserted into the cache. In some versions the framework does not hold a
+reference count, but they are more complicated.
+
+Using Atomic Operations For The Reference Count
+~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~
+
+In practice, ``atomic_t`` would usually be used for refcnt. There are a
+number of atomic operations defined in ``include/asm/atomic.h``: these
+are guaranteed to be seen atomically from all CPUs in the system, so no
+lock is required. In this case, it is simpler than using spinlocks,
+although for anything non-trivial using spinlocks is clearer. The
+:c:func:`atomic_inc()` and :c:func:`atomic_dec_and_test()`
+are used instead of the standard increment and decrement operators, and
+the lock is no longer used to protect the reference count itself.
+
+::
+
+ --- cache.c.refcnt 2003-12-09 15:00:35.000000000 +1100
+ +++ cache.c.refcnt-atomic 2003-12-11 15:49:42.000000000 +1100
+ @@ -7,7 +7,7 @@
+ struct object
+ {
+ struct list_head list;
+ - unsigned int refcnt;
+ + atomic_t refcnt;
+ int id;
+ char name[32];
+ int popularity;
+ @@ -18,33 +18,15 @@
+ static unsigned int cache_num = 0;
+ #define MAX_CACHE_SIZE 10
+
+ -static void __object_put(struct object *obj)
+ -{
+ - if (--obj->refcnt == 0)
+ - kfree(obj);
+ -}
+ -
+ -static void __object_get(struct object *obj)
+ -{
+ - obj->refcnt++;
+ -}
+ -
+ void object_put(struct object *obj)
+ {
+ - unsigned long flags;
+ -
+ - spin_lock_irqsave(&cache_lock, flags);
+ - __object_put(obj);
+ - spin_unlock_irqrestore(&cache_lock, flags);
+ + if (atomic_dec_and_test(&obj->refcnt))
+ + kfree(obj);
+ }
+
+ void object_get(struct object *obj)
+ {
+ - unsigned long flags;
+ -
+ - spin_lock_irqsave(&cache_lock, flags);
+ - __object_get(obj);
+ - spin_unlock_irqrestore(&cache_lock, flags);
+ + atomic_inc(&obj->refcnt);
+ }
+
+ /* Must be holding cache_lock */
+ @@ -65,7 +47,7 @@
+ {
+ BUG_ON(!obj);
+ list_del(&obj->list);
+ - __object_put(obj);
+ + object_put(obj);
+ cache_num--;
+ }
+
+ @@ -94,7 +76,7 @@
+ strlcpy(obj->name, name, sizeof(obj->name));
+ obj->id = id;
+ obj->popularity = 0;
+ - obj->refcnt = 1; /* The cache holds a reference */
+ + atomic_set(&obj->refcnt, 1); /* The cache holds a reference */
+
+ spin_lock_irqsave(&cache_lock, flags);
+ __cache_add(obj);
+ @@ -119,7 +101,7 @@
+ spin_lock_irqsave(&cache_lock, flags);
+ obj = __cache_find(id);
+ if (obj)
+ - __object_get(obj);
+ + object_get(obj);
+ spin_unlock_irqrestore(&cache_lock, flags);
+ return obj;
+ }
+
+Protecting The Objects Themselves
+---------------------------------
+
+In these examples, we assumed that the objects (except the reference
+counts) never changed once they are created. If we wanted to allow the
+name to change, there are three possibilities:
+
+- You can make ``cache_lock`` non-static, and tell people to grab that
+ lock before changing the name in any object.
+
+- You can provide a :c:func:`cache_obj_rename()` which grabs this
+ lock and changes the name for the caller, and tell everyone to use
+ that function.
+
+- You can make the ``cache_lock`` protect only the cache itself, and
+ use another lock to protect the name.
+
+Theoretically, you can make the locks as fine-grained as one lock for
+every field, for every object. In practice, the most common variants
+are:
+
+- One lock which protects the infrastructure (the ``cache`` list in
+ this example) and all the objects. This is what we have done so far.
+
+- One lock which protects the infrastructure (including the list
+ pointers inside the objects), and one lock inside the object which
+ protects the rest of that object.
+
+- Multiple locks to protect the infrastructure (eg. one lock per hash
+ chain), possibly with a separate per-object lock.
+
+Here is the "lock-per-object" implementation:
+
+::
+
+ --- cache.c.refcnt-atomic 2003-12-11 15:50:54.000000000 +1100
+ +++ cache.c.perobjectlock 2003-12-11 17:15:03.000000000 +1100
+ @@ -6,11 +6,17 @@
+
+ struct object
+ {
+ + /* These two protected by cache_lock. */
+ struct list_head list;
+ + int popularity;
+ +
+ atomic_t refcnt;
+ +
+ + /* Doesn't change once created. */
+ int id;
+ +
+ + spinlock_t lock; /* Protects the name */
+ char name[32];
+ - int popularity;
+ };
+
+ static DEFINE_SPINLOCK(cache_lock);
+ @@ -77,6 +84,7 @@
+ obj->id = id;
+ obj->popularity = 0;
+ atomic_set(&obj->refcnt, 1); /* The cache holds a reference */
+ + spin_lock_init(&obj->lock);
+
+ spin_lock_irqsave(&cache_lock, flags);
+ __cache_add(obj);
+
+Note that I decide that the popularity count should be protected by the
+``cache_lock`` rather than the per-object lock: this is because it (like
+the :c:type:`struct list_head <list_head>` inside the object)
+is logically part of the infrastructure. This way, I don't need to grab
+the lock of every object in :c:func:`__cache_add()` when seeking
+the least popular.
+
+I also decided that the id member is unchangeable, so I don't need to
+grab each object lock in :c:func:`__cache_find()` to examine the
+id: the object lock is only used by a caller who wants to read or write
+the name field.
+
+Note also that I added a comment describing what data was protected by
+which locks. This is extremely important, as it describes the runtime
+behavior of the code, and can be hard to gain from just reading. And as
+Alan Cox says, “Lock data, not code”.
+
+Common Problems
+===============
+
+Deadlock: Simple and Advanced
+-----------------------------
+
+There is a coding bug where a piece of code tries to grab a spinlock
+twice: it will spin forever, waiting for the lock to be released
+(spinlocks, rwlocks and mutexes are not recursive in Linux). This is
+trivial to diagnose: not a
+stay-up-five-nights-talk-to-fluffy-code-bunnies kind of problem.
+
+For a slightly more complex case, imagine you have a region shared by a
+softirq and user context. If you use a :c:func:`spin_lock()` call
+to protect it, it is possible that the user context will be interrupted
+by the softirq while it holds the lock, and the softirq will then spin
+forever trying to get the same lock.
+
+Both of these are called deadlock, and as shown above, it can occur even
+with a single CPU (although not on UP compiles, since spinlocks vanish
+on kernel compiles with ``CONFIG_SMP``\ =n. You'll still get data
+corruption in the second example).
+
+This complete lockup is easy to diagnose: on SMP boxes the watchdog
+timer or compiling with ``DEBUG_SPINLOCK`` set
+(``include/linux/spinlock.h``) will show this up immediately when it
+happens.
+
+A more complex problem is the so-called 'deadly embrace', involving two
+or more locks. Say you have a hash table: each entry in the table is a
+spinlock, and a chain of hashed objects. Inside a softirq handler, you
+sometimes want to alter an object from one place in the hash to another:
+you grab the spinlock of the old hash chain and the spinlock of the new
+hash chain, and delete the object from the old one, and insert it in the
+new one.
+
+There are two problems here. First, if your code ever tries to move the
+object to the same chain, it will deadlock with itself as it tries to
+lock it twice. Secondly, if the same softirq on another CPU is trying to
+move another object in the reverse direction, the following could
+happen:
+
++-----------------------+-----------------------+
+| CPU 1 | CPU 2 |
++=======================+=======================+
+| Grab lock A -> OK | Grab lock B -> OK |
++-----------------------+-----------------------+
+| Grab lock B -> spin | Grab lock A -> spin |
++-----------------------+-----------------------+
+
+Table: Consequences
+
+The two CPUs will spin forever, waiting for the other to give up their
+lock. It will look, smell, and feel like a crash.
+
+Preventing Deadlock
+-------------------
+
+Textbooks will tell you that if you always lock in the same order, you
+will never get this kind of deadlock. Practice will tell you that this
+approach doesn't scale: when I create a new lock, I don't understand
+enough of the kernel to figure out where in the 5000 lock hierarchy it
+will fit.
+
+The best locks are encapsulated: they never get exposed in headers, and
+are never held around calls to non-trivial functions outside the same
+file. You can read through this code and see that it will never
+deadlock, because it never tries to grab another lock while it has that
+one. People using your code don't even need to know you are using a
+lock.
+
+A classic problem here is when you provide callbacks or hooks: if you
+call these with the lock held, you risk simple deadlock, or a deadly
+embrace (who knows what the callback will do?). Remember, the other
+programmers are out to get you, so don't do this.
+
+Overzealous Prevention Of Deadlocks
+~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~
+
+Deadlocks are problematic, but not as bad as data corruption. Code which
+grabs a read lock, searches a list, fails to find what it wants, drops
+the read lock, grabs a write lock and inserts the object has a race
+condition.
+
+If you don't see why, please stay the fuck away from my code.
+
+Racing Timers: A Kernel Pastime
+-------------------------------
+
+Timers can produce their own special problems with races. Consider a
+collection of objects (list, hash, etc) where each object has a timer
+which is due to destroy it.
+
+If you want to destroy the entire collection (say on module removal),
+you might do the following::
+
+ /* THIS CODE BAD BAD BAD BAD: IF IT WAS ANY WORSE IT WOULD USE
+ HUNGARIAN NOTATION */
+ spin_lock_bh(&list_lock);
+
+ while (list) {
+ struct foo *next = list->next;
+ del_timer(&list->timer);
+ kfree(list);
+ list = next;
+ }
+
+ spin_unlock_bh(&list_lock);
+
+
+Sooner or later, this will crash on SMP, because a timer can have just
+gone off before the :c:func:`spin_lock_bh()`, and it will only get
+the lock after we :c:func:`spin_unlock_bh()`, and then try to free
+the element (which has already been freed!).
+
+This can be avoided by checking the result of
+:c:func:`del_timer()`: if it returns 1, the timer has been deleted.
+If 0, it means (in this case) that it is currently running, so we can
+do::
+
+ retry:
+ spin_lock_bh(&list_lock);
+
+ while (list) {
+ struct foo *next = list->next;
+ if (!del_timer(&list->timer)) {
+ /* Give timer a chance to delete this */
+ spin_unlock_bh(&list_lock);
+ goto retry;
+ }
+ kfree(list);
+ list = next;
+ }
+
+ spin_unlock_bh(&list_lock);
+
+
+Another common problem is deleting timers which restart themselves (by
+calling :c:func:`add_timer()` at the end of their timer function).
+Because this is a fairly common case which is prone to races, you should
+use :c:func:`del_timer_sync()` (``include/linux/timer.h``) to
+handle this case. It returns the number of times the timer had to be
+deleted before we finally stopped it from adding itself back in.
+
+Locking Speed
+=============
+
+There are three main things to worry about when considering speed of
+some code which does locking. First is concurrency: how many things are
+going to be waiting while someone else is holding a lock. Second is the
+time taken to actually acquire and release an uncontended lock. Third is
+using fewer, or smarter locks. I'm assuming that the lock is used fairly
+often: otherwise, you wouldn't be concerned about efficiency.
+
+Concurrency depends on how long the lock is usually held: you should
+hold the lock for as long as needed, but no longer. In the cache
+example, we always create the object without the lock held, and then
+grab the lock only when we are ready to insert it in the list.
+
+Acquisition times depend on how much damage the lock operations do to
+the pipeline (pipeline stalls) and how likely it is that this CPU was
+the last one to grab the lock (ie. is the lock cache-hot for this CPU):
+on a machine with more CPUs, this likelihood drops fast. Consider a
+700MHz Intel Pentium III: an instruction takes about 0.7ns, an atomic
+increment takes about 58ns, a lock which is cache-hot on this CPU takes
+160ns, and a cacheline transfer from another CPU takes an additional 170
+to 360ns. (These figures from Paul McKenney's `Linux Journal RCU
+article <http://www.linuxjournal.com/article.php?sid=6993>`__).
+
+These two aims conflict: holding a lock for a short time might be done
+by splitting locks into parts (such as in our final per-object-lock
+example), but this increases the number of lock acquisitions, and the
+results are often slower than having a single lock. This is another
+reason to advocate locking simplicity.
+
+The third concern is addressed below: there are some methods to reduce
+the amount of locking which needs to be done.
+
+Read/Write Lock Variants
+------------------------
+
+Both spinlocks and mutexes have read/write variants: ``rwlock_t`` and
+:c:type:`struct rw_semaphore <rw_semaphore>`. These divide
+users into two classes: the readers and the writers. If you are only
+reading the data, you can get a read lock, but to write to the data you
+need the write lock. Many people can hold a read lock, but a writer must
+be sole holder.
+
+If your code divides neatly along reader/writer lines (as our cache code
+does), and the lock is held by readers for significant lengths of time,
+using these locks can help. They are slightly slower than the normal
+locks though, so in practice ``rwlock_t`` is not usually worthwhile.
+
+Avoiding Locks: Read Copy Update
+--------------------------------
+
+There is a special method of read/write locking called Read Copy Update.
+Using RCU, the readers can avoid taking a lock altogether: as we expect
+our cache to be read more often than updated (otherwise the cache is a
+waste of time), it is a candidate for this optimization.
+
+How do we get rid of read locks? Getting rid of read locks means that
+writers may be changing the list underneath the readers. That is
+actually quite simple: we can read a linked list while an element is
+being added if the writer adds the element very carefully. For example,
+adding ``new`` to a single linked list called ``list``::
+
+ new->next = list->next;
+ wmb();
+ list->next = new;
+
+
+The :c:func:`wmb()` is a write memory barrier. It ensures that the
+first operation (setting the new element's ``next`` pointer) is complete
+and will be seen by all CPUs, before the second operation is (putting
+the new element into the list). This is important, since modern
+compilers and modern CPUs can both reorder instructions unless told
+otherwise: we want a reader to either not see the new element at all, or
+see the new element with the ``next`` pointer correctly pointing at the
+rest of the list.
+
+Fortunately, there is a function to do this for standard
+:c:type:`struct list_head <list_head>` lists:
+:c:func:`list_add_rcu()` (``include/linux/list.h``).
+
+Removing an element from the list is even simpler: we replace the
+pointer to the old element with a pointer to its successor, and readers
+will either see it, or skip over it.
+
+::
+
+ list->next = old->next;
+
+
+There is :c:func:`list_del_rcu()` (``include/linux/list.h``) which
+does this (the normal version poisons the old object, which we don't
+want).
+
+The reader must also be careful: some CPUs can look through the ``next``
+pointer to start reading the contents of the next element early, but
+don't realize that the pre-fetched contents is wrong when the ``next``
+pointer changes underneath them. Once again, there is a
+:c:func:`list_for_each_entry_rcu()` (``include/linux/list.h``)
+to help you. Of course, writers can just use
+:c:func:`list_for_each_entry()`, since there cannot be two
+simultaneous writers.
+
+Our final dilemma is this: when can we actually destroy the removed
+element? Remember, a reader might be stepping through this element in
+the list right now: if we free this element and the ``next`` pointer
+changes, the reader will jump off into garbage and crash. We need to
+wait until we know that all the readers who were traversing the list
+when we deleted the element are finished. We use
+:c:func:`call_rcu()` to register a callback which will actually
+destroy the object once all pre-existing readers are finished.
+Alternatively, :c:func:`synchronize_rcu()` may be used to block
+until all pre-existing are finished.
+
+But how does Read Copy Update know when the readers are finished? The
+method is this: firstly, the readers always traverse the list inside
+:c:func:`rcu_read_lock()`/:c:func:`rcu_read_unlock()` pairs:
+these simply disable preemption so the reader won't go to sleep while
+reading the list.
+
+RCU then waits until every other CPU has slept at least once: since
+readers cannot sleep, we know that any readers which were traversing the
+list during the deletion are finished, and the callback is triggered.
+The real Read Copy Update code is a little more optimized than this, but
+this is the fundamental idea.
+
+::
+
+ --- cache.c.perobjectlock 2003-12-11 17:15:03.000000000 +1100
+ +++ cache.c.rcupdate 2003-12-11 17:55:14.000000000 +1100
+ @@ -1,15 +1,18 @@
+ #include <linux/list.h>
+ #include <linux/slab.h>
+ #include <linux/string.h>
+ +#include <linux/rcupdate.h>
+ #include <linux/mutex.h>
+ #include <asm/errno.h>
+
+ struct object
+ {
+ - /* These two protected by cache_lock. */
+ + /* This is protected by RCU */
+ struct list_head list;
+ int popularity;
+
+ + struct rcu_head rcu;
+ +
+ atomic_t refcnt;
+
+ /* Doesn't change once created. */
+ @@ -40,7 +43,7 @@
+ {
+ struct object *i;
+
+ - list_for_each_entry(i, &cache, list) {
+ + list_for_each_entry_rcu(i, &cache, list) {
+ if (i->id == id) {
+ i->popularity++;
+ return i;
+ @@ -49,19 +52,25 @@
+ return NULL;
+ }
+
+ +/* Final discard done once we know no readers are looking. */
+ +static void cache_delete_rcu(void *arg)
+ +{
+ + object_put(arg);
+ +}
+ +
+ /* Must be holding cache_lock */
+ static void __cache_delete(struct object *obj)
+ {
+ BUG_ON(!obj);
+ - list_del(&obj->list);
+ - object_put(obj);
+ + list_del_rcu(&obj->list);
+ cache_num--;
+ + call_rcu(&obj->rcu, cache_delete_rcu);
+ }
+
+ /* Must be holding cache_lock */
+ static void __cache_add(struct object *obj)
+ {
+ - list_add(&obj->list, &cache);
+ + list_add_rcu(&obj->list, &cache);
+ if (++cache_num > MAX_CACHE_SIZE) {
+ struct object *i, *outcast = NULL;
+ list_for_each_entry(i, &cache, list) {
+ @@ -104,12 +114,11 @@
+ struct object *cache_find(int id)
+ {
+ struct object *obj;
+ - unsigned long flags;
+
+ - spin_lock_irqsave(&cache_lock, flags);
+ + rcu_read_lock();
+ obj = __cache_find(id);
+ if (obj)
+ object_get(obj);
+ - spin_unlock_irqrestore(&cache_lock, flags);
+ + rcu_read_unlock();
+ return obj;
+ }
+
+Note that the reader will alter the popularity member in
+:c:func:`__cache_find()`, and now it doesn't hold a lock. One
+solution would be to make it an ``atomic_t``, but for this usage, we
+don't really care about races: an approximate result is good enough, so
+I didn't change it.
+
+The result is that :c:func:`cache_find()` requires no
+synchronization with any other functions, so is almost as fast on SMP as
+it would be on UP.
+
+There is a further optimization possible here: remember our original
+cache code, where there were no reference counts and the caller simply
+held the lock whenever using the object? This is still possible: if you
+hold the lock, no one can delete the object, so you don't need to get
+and put the reference count.
+
+Now, because the 'read lock' in RCU is simply disabling preemption, a
+caller which always has preemption disabled between calling
+:c:func:`cache_find()` and :c:func:`object_put()` does not
+need to actually get and put the reference count: we could expose
+:c:func:`__cache_find()` by making it non-static, and such
+callers could simply call that.
+
+The benefit here is that the reference count is not written to: the
+object is not altered in any way, which is much faster on SMP machines
+due to caching.
+
+Per-CPU Data
+------------
+
+Another technique for avoiding locking which is used fairly widely is to
+duplicate information for each CPU. For example, if you wanted to keep a
+count of a common condition, you could use a spin lock and a single
+counter. Nice and simple.
+
+If that was too slow (it's usually not, but if you've got a really big
+machine to test on and can show that it is), you could instead use a
+counter for each CPU, then none of them need an exclusive lock. See
+:c:func:`DEFINE_PER_CPU()`, :c:func:`get_cpu_var()` and
+:c:func:`put_cpu_var()` (``include/linux/percpu.h``).
+
+Of particular use for simple per-cpu counters is the ``local_t`` type,
+and the :c:func:`cpu_local_inc()` and related functions, which are
+more efficient than simple code on some architectures
+(``include/asm/local.h``).
+
+Note that there is no simple, reliable way of getting an exact value of
+such a counter, without introducing more locks. This is not a problem
+for some uses.
+
+Data Which Mostly Used By An IRQ Handler
+----------------------------------------
+
+If data is always accessed from within the same IRQ handler, you don't
+need a lock at all: the kernel already guarantees that the irq handler
+will not run simultaneously on multiple CPUs.
+
+Manfred Spraul points out that you can still do this, even if the data
+is very occasionally accessed in user context or softirqs/tasklets. The
+irq handler doesn't use a lock, and all other accesses are done as so::
+
+ spin_lock(&lock);
+ disable_irq(irq);
+ ...
+ enable_irq(irq);
+ spin_unlock(&lock);
+
+The :c:func:`disable_irq()` prevents the irq handler from running
+(and waits for it to finish if it's currently running on other CPUs).
+The spinlock prevents any other accesses happening at the same time.
+Naturally, this is slower than just a :c:func:`spin_lock_irq()`
+call, so it only makes sense if this type of access happens extremely
+rarely.
+
+What Functions Are Safe To Call From Interrupts?
+================================================
+
+Many functions in the kernel sleep (ie. call schedule()) directly or
+indirectly: you can never call them while holding a spinlock, or with
+preemption disabled. This also means you need to be in user context:
+calling them from an interrupt is illegal.
+
+Some Functions Which Sleep
+--------------------------
+
+The most common ones are listed below, but you usually have to read the
+code to find out if other calls are safe. If everyone else who calls it
+can sleep, you probably need to be able to sleep, too. In particular,
+registration and deregistration functions usually expect to be called
+from user context, and can sleep.
+
+- Accesses to userspace:
+
+ - :c:func:`copy_from_user()`
+
+ - :c:func:`copy_to_user()`
+
+ - :c:func:`get_user()`
+
+ - :c:func:`put_user()`
+
+- ``kmalloc(GFP_KERNEL)``
+
+- :c:func:`mutex_lock_interruptible()` and
+ :c:func:`mutex_lock()`
+
+ There is a :c:func:`mutex_trylock()` which does not sleep.
+ Still, it must not be used inside interrupt context since its
+ implementation is not safe for that. :c:func:`mutex_unlock()`
+ will also never sleep. It cannot be used in interrupt context either
+ since a mutex must be released by the same task that acquired it.
+
+Some Functions Which Don't Sleep
+--------------------------------
+
+Some functions are safe to call from any context, or holding almost any
+lock.
+
+- :c:func:`printk()`
+
+- :c:func:`kfree()`
+
+- :c:func:`add_timer()` and :c:func:`del_timer()`
+
+Mutex API reference
+===================
+
+.. kernel-doc:: include/linux/mutex.h
+ :internal:
+
+.. kernel-doc:: kernel/locking/mutex.c
+ :export:
+
+Futex API reference
+===================
+
+.. kernel-doc:: kernel/futex.c
+ :internal:
+
+Further reading
+===============
+
+- ``Documentation/locking/spinlocks.txt``: Linus Torvalds' spinlocking
+ tutorial in the kernel sources.
+
+- Unix Systems for Modern Architectures: Symmetric Multiprocessing and
+ Caching for Kernel Programmers:
+
+ Curt Schimmel's very good introduction to kernel level locking (not
+ written for Linux, but nearly everything applies). The book is
+ expensive, but really worth every penny to understand SMP locking.
+ [ISBN: 0201633388]
+
+Thanks
+======
+
+Thanks to Telsa Gwynne for DocBooking, neatening and adding style.
+
+Thanks to Martin Pool, Philipp Rumpf, Stephen Rothwell, Paul Mackerras,
+Ruedi Aschwanden, Alan Cox, Manfred Spraul, Tim Waugh, Pete Zaitcev,
+James Morris, Robert Love, Paul McKenney, John Ashby for proofreading,
+correcting, flaming, commenting.
+
+Thanks to the cabal for having no influence on this document.
+
+Glossary
+========
+
+preemption
+ Prior to 2.5, or when ``CONFIG_PREEMPT`` is unset, processes in user
+ context inside the kernel would not preempt each other (ie. you had that
+ CPU until you gave it up, except for interrupts). With the addition of
+ ``CONFIG_PREEMPT`` in 2.5.4, this changed: when in user context, higher
+ priority tasks can "cut in": spinlocks were changed to disable
+ preemption, even on UP.
+
+bh
+ Bottom Half: for historical reasons, functions with '_bh' in them often
+ now refer to any software interrupt, e.g. :c:func:`spin_lock_bh()`
+ blocks any software interrupt on the current CPU. Bottom halves are
+ deprecated, and will eventually be replaced by tasklets. Only one bottom
+ half will be running at any time.
+
+Hardware Interrupt / Hardware IRQ
+ Hardware interrupt request. :c:func:`in_irq()` returns true in a
+ hardware interrupt handler.
+
+Interrupt Context
+ Not user context: processing a hardware irq or software irq. Indicated
+ by the :c:func:`in_interrupt()` macro returning true.
+
+SMP
+ Symmetric Multi-Processor: kernels compiled for multiple-CPU machines.
+ (``CONFIG_SMP=y``).
+
+Software Interrupt / softirq
+ Software interrupt handler. :c:func:`in_irq()` returns false;
+ :c:func:`in_softirq()` returns true. Tasklets and softirqs both
+ fall into the category of 'software interrupts'.
+
+ Strictly speaking a softirq is one of up to 32 enumerated software
+ interrupts which can run on multiple CPUs at once. Sometimes used to
+ refer to tasklets as well (ie. all software interrupts).
+
+tasklet
+ A dynamically-registrable software interrupt, which is guaranteed to
+ only run on one CPU at a time.
+
+timer
+ A dynamically-registrable software interrupt, which is run at (or close
+ to) a given time. When running, it is just like a tasklet (in fact, they
+ are called from the TIMER_SOFTIRQ).
+
+UP
+ Uni-Processor: Non-SMP. (CONFIG_SMP=n).
+
+User Context
+ The kernel executing on behalf of a particular process (ie. a system
+ call or trap) or kernel thread. You can tell which process with the
+ ``current`` macro.) Not to be confused with userspace. Can be
+ interrupted by software or hardware interrupts.
+
+Userspace
+ A process executing its own code outside the kernel.
--
2.9.3