Merge branch 'docs-next' of git://git.lwn.net/linux-2.6

* 'docs-next' of git://git.lwn.net/linux-2.6:
  Fix a typo in the development process document.
  Document handling of bad memory
  Document RCU and unloadable modules

4 files changed, 354 insertions, 3 deletions

diff --git a/Documentation/RCU/00-INDEX b/Documentation/RCU/00-INDEX
index 7dc0695a8f9..9bb62f7b89c 100644
--- a/Documentation/RCU/00-INDEX
+++ b/Documentation/RCU/00-INDEX
@@ -12,6 +12,8 @@ rcuref.txt
 	- Reference-count design for elements of lists/arrays protected by RCU
 rcu.txt
 	- RCU Concepts
+rcubarrier.txt
+	- Unloading modules that use RCU callbacks
 RTFP.txt
 	- List of RCU papers (bibliography) going back to 1980.
 torture.txt
diff --git a/Documentation/RCU/rcubarrier.txt b/Documentation/RCU/rcubarrier.txt
new file mode 100644
index 00000000000..909602d409b
--- /dev/null
+++ b/Documentation/RCU/rcubarrier.txt
@@ -0,0 +1,304 @@
+RCU and Unloadable Modules
+
+[Originally published in LWN Jan. 14, 2007: http://lwn.net/Articles/217484/]
+
+RCU (read-copy update) is a synchronization mechanism that can be thought
+of as a replacement for read-writer locking (among other things), but with
+very low-overhead readers that are immune to deadlock, priority inversion,
+and unbounded latency. RCU read-side critical sections are delimited
+by rcu_read_lock() and rcu_read_unlock(), which, in non-CONFIG_PREEMPT
+kernels, generate no code whatsoever.
+
+This means that RCU writers are unaware of the presence of concurrent
+readers, so that RCU updates to shared data must be undertaken quite
+carefully, leaving an old version of the data structure in place until all
+pre-existing readers have finished. These old versions are needed because
+such readers might hold a reference to them. RCU updates can therefore be
+rather expensive, and RCU is thus best suited for read-mostly situations.
+
+How can an RCU writer possibly determine when all readers are finished,
+given that readers might well leave absolutely no trace of their
+presence? There is a synchronize_rcu() primitive that blocks until all
+pre-existing readers have completed. An updater wishing to delete an
+element p from a linked list might do the following, while holding an
+appropriate lock, of course:
+
+	list_del_rcu(p);
+	synchronize_rcu();
+	kfree(p);
+
+But the above code cannot be used in IRQ context -- the call_rcu()
+primitive must be used instead. This primitive takes a pointer to an
+rcu_head struct placed within the RCU-protected data structure and
+another pointer to a function that may be invoked later to free that
+structure. Code to delete an element p from the linked list from IRQ
+context might then be as follows:
+
+	list_del_rcu(p);
+	call_rcu(&p->rcu, p_callback);
+
+Since call_rcu() never blocks, this code can safely be used from within
+IRQ context. The function p_callback() might be defined as follows:
+
+	static void p_callback(struct rcu_head *rp)
+	{
+		struct pstruct *p = container_of(rp, struct pstruct, rcu);
+
+		kfree(p);
+	}
+
+
+Unloading Modules That Use call_rcu()
+
+But what if p_callback is defined in an unloadable module?
+
+If we unload the module while some RCU callbacks are pending,
+the CPUs executing these callbacks are going to be severely
+disappointed when they are later invoked, as fancifully depicted at
+http://lwn.net/images/ns/kernel/rcu-drop.jpg.
+
+We could try placing a synchronize_rcu() in the module-exit code path,
+but this is not sufficient. Although synchronize_rcu() does wait for a
+grace period to elapse, it does not wait for the callbacks to complete.
+
+One might be tempted to try several back-to-back synchronize_rcu()
+calls, but this is still not guaranteed to work. If there is a very
+heavy RCU-callback load, then some of the callbacks might be deferred
+in order to allow other processing to proceed. Such deferral is required
+in realtime kernels in order to avoid excessive scheduling latencies.
+
+
+rcu_barrier()
+
+We instead need the rcu_barrier() primitive. This primitive is similar
+to synchronize_rcu(), but instead of waiting solely for a grace
+period to elapse, it also waits for all outstanding RCU callbacks to
+complete. Pseudo-code using rcu_barrier() is as follows:
+
+   1. Prevent any new RCU callbacks from being posted.
+   2. Execute rcu_barrier().
+   3. Allow the module to be unloaded.
+
+Quick Quiz #1: Why is there no srcu_barrier()?
+
+The rcutorture module makes use of rcu_barrier in its exit function
+as follows:
+
+ 1 static void
+ 2 rcu_torture_cleanup(void)
+ 3 {
+ 4   int i;
+ 5
+ 6   fullstop = 1;
+ 7   if (shuffler_task != NULL) {
+ 8     VERBOSE_PRINTK_STRING("Stopping rcu_torture_shuffle task");
+ 9     kthread_stop(shuffler_task);
+10   }
+11   shuffler_task = NULL;
+12
+13   if (writer_task != NULL) {
+14     VERBOSE_PRINTK_STRING("Stopping rcu_torture_writer task");
+15     kthread_stop(writer_task);
+16   }
+17   writer_task = NULL;
+18
+19   if (reader_tasks != NULL) {
+20     for (i = 0; i < nrealreaders; i++) {
+21       if (reader_tasks[i] != NULL) {
+22         VERBOSE_PRINTK_STRING(
+23           "Stopping rcu_torture_reader task");
+24         kthread_stop(reader_tasks[i]);
+25       }
+26       reader_tasks[i] = NULL;
+27     }
+28     kfree(reader_tasks);
+29     reader_tasks = NULL;
+30   }
+31   rcu_torture_current = NULL;
+32
+33   if (fakewriter_tasks != NULL) {
+34     for (i = 0; i < nfakewriters; i++) {
+35       if (fakewriter_tasks[i] != NULL) {
+36         VERBOSE_PRINTK_STRING(
+37           "Stopping rcu_torture_fakewriter task");
+38         kthread_stop(fakewriter_tasks[i]);
+39       }
+40       fakewriter_tasks[i] = NULL;
+41     }
+42     kfree(fakewriter_tasks);
+43     fakewriter_tasks = NULL;
+44   }
+45
+46   if (stats_task != NULL) {
+47     VERBOSE_PRINTK_STRING("Stopping rcu_torture_stats task");
+48     kthread_stop(stats_task);
+49   }
+50   stats_task = NULL;
+51
+52   /* Wait for all RCU callbacks to fire. */
+53   rcu_barrier();
+54
+55   rcu_torture_stats_print(); /* -After- the stats thread is stopped! */
+56
+57   if (cur_ops->cleanup != NULL)
+58     cur_ops->cleanup();
+59   if (atomic_read(&n_rcu_torture_error))
+60     rcu_torture_print_module_parms("End of test: FAILURE");
+61   else
+62     rcu_torture_print_module_parms("End of test: SUCCESS");
+63 }
+
+Line 6 sets a global variable that prevents any RCU callbacks from
+re-posting themselves. This will not be necessary in most cases, since
+RCU callbacks rarely include calls to call_rcu(). However, the rcutorture
+module is an exception to this rule, and therefore needs to set this
+global variable.
+
+Lines 7-50 stop all the kernel tasks associated with the rcutorture
+module. Therefore, once execution reaches line 53, no more rcutorture
+RCU callbacks will be posted. The rcu_barrier() call on line 53 waits
+for any pre-existing callbacks to complete.
+
+Then lines 55-62 print status and do operation-specific cleanup, and
+then return, permitting the module-unload operation to be completed.
+
+Quick Quiz #2: Is there any other situation where rcu_barrier() might
+	be required?
+
+Your module might have additional complications. For example, if your
+module invokes call_rcu() from timers, you will need to first cancel all
+the timers, and only then invoke rcu_barrier() to wait for any remaining
+RCU callbacks to complete.
+
+
+Implementing rcu_barrier()
+
+Dipankar Sarma's implementation of rcu_barrier() makes use of the fact
+that RCU callbacks are never reordered once queued on one of the per-CPU
+queues. His implementation queues an RCU callback on each of the per-CPU
+callback queues, and then waits until they have all started executing, at
+which point, all earlier RCU callbacks are guaranteed to have completed.
+
+The original code for rcu_barrier() was as follows:
+
+ 1 void rcu_barrier(void)
+ 2 {
+ 3   BUG_ON(in_interrupt());
+ 4   /* Take cpucontrol mutex to protect against CPU hotplug */
+ 5   mutex_lock(&rcu_barrier_mutex);
+ 6   init_completion(&rcu_barrier_completion);
+ 7   atomic_set(&rcu_barrier_cpu_count, 0);
+ 8   on_each_cpu(rcu_barrier_func, NULL, 0, 1);
+ 9   wait_for_completion(&rcu_barrier_completion);
+10   mutex_unlock(&rcu_barrier_mutex);
+11 }
+
+Line 3 verifies that the caller is in process context, and lines 5 and 10
+use rcu_barrier_mutex to ensure that only one rcu_barrier() is using the
+global completion and counters at a time, which are initialized on lines
+6 and 7. Line 8 causes each CPU to invoke rcu_barrier_func(), which is
+shown below. Note that the final "1" in on_each_cpu()'s argument list
+ensures that all the calls to rcu_barrier_func() will have completed
+before on_each_cpu() returns. Line 9 then waits for the completion.
+
+This code was rewritten in 2008 to support rcu_barrier_bh() and
+rcu_barrier_sched() in addition to the original rcu_barrier().
+
+The rcu_barrier_func() runs on each CPU, where it invokes call_rcu()
+to post an RCU callback, as follows:
+
+ 1 static void rcu_barrier_func(void *notused)
+ 2 {
+ 3 int cpu = smp_processor_id();
+ 4 struct rcu_data *rdp = &per_cpu(rcu_data, cpu);
+ 5 struct rcu_head *head;
+ 6
+ 7 head = &rdp->barrier;
+ 8 atomic_inc(&rcu_barrier_cpu_count);
+ 9 call_rcu(head, rcu_barrier_callback);
+10 }
+
+Lines 3 and 4 locate RCU's internal per-CPU rcu_data structure,
+which contains the struct rcu_head that needed for the later call to
+call_rcu(). Line 7 picks up a pointer to this struct rcu_head, and line
+8 increments a global counter. This counter will later be decremented
+by the callback. Line 9 then registers the rcu_barrier_callback() on
+the current CPU's queue.
+
+The rcu_barrier_callback() function simply atomically decrements the
+rcu_barrier_cpu_count variable and finalizes the completion when it
+reaches zero, as follows:
+
+ 1 static void rcu_barrier_callback(struct rcu_head *notused)
+ 2 {
+ 3 if (atomic_dec_and_test(&rcu_barrier_cpu_count))
+ 4 complete(&rcu_barrier_completion);
+ 5 }
+
+Quick Quiz #3: What happens if CPU 0's rcu_barrier_func() executes
+	immediately (thus incrementing rcu_barrier_cpu_count to the
+	value one), but the other CPU's rcu_barrier_func() invocations
+	are delayed for a full grace period? Couldn't this result in
+	rcu_barrier() returning prematurely?
+
+
+rcu_barrier() Summary
+
+The rcu_barrier() primitive has seen relatively little use, since most
+code using RCU is in the core kernel rather than in modules. However, if
+you are using RCU from an unloadable module, you need to use rcu_barrier()
+so that your module may be safely unloaded.
+
+
+Answers to Quick Quizzes
+
+Quick Quiz #1: Why is there no srcu_barrier()?
+
+Answer: Since there is no call_srcu(), there can be no outstanding SRCU
+	callbacks. Therefore, there is no need to wait for them.
+
+Quick Quiz #2: Is there any other situation where rcu_barrier() might
+	be required?
+
+Answer: Interestingly enough, rcu_barrier() was not originally
+	implemented for module unloading. Nikita Danilov was using
+	RCU in a filesystem, which resulted in a similar situation at
+	filesystem-unmount time. Dipankar Sarma coded up rcu_barrier()
+	in response, so that Nikita could invoke it during the
+	filesystem-unmount process.
+
+	Much later, yours truly hit the RCU module-unload problem when
+	implementing rcutorture, and found that rcu_barrier() solves
+	this problem as well.
+
+Quick Quiz #3: What happens if CPU 0's rcu_barrier_func() executes
+	immediately (thus incrementing rcu_barrier_cpu_count to the
+	value one), but the other CPU's rcu_barrier_func() invocations
+	are delayed for a full grace period? Couldn't this result in
+	rcu_barrier() returning prematurely?
+
+Answer: This cannot happen. The reason is that on_each_cpu() has its last
+	argument, the wait flag, set to "1". This flag is passed through
+	to smp_call_function() and further to smp_call_function_on_cpu(),
+	causing this latter to spin until the cross-CPU invocation of
+	rcu_barrier_func() has completed. This by itself would prevent
+	a grace period from completing on non-CONFIG_PREEMPT kernels,
+	since each CPU must undergo a context switch (or other quiescent
+	state) before the grace period can complete. However, this is
+	of no use in CONFIG_PREEMPT kernels.
+
+	Therefore, on_each_cpu() disables preemption across its call
+	to smp_call_function() and also across the local call to
+	rcu_barrier_func(). This prevents the local CPU from context
+	switching, again preventing grace periods from completing. This
+	means that all CPUs have executed rcu_barrier_func() before
+	the first rcu_barrier_callback() can possibly execute, in turn
+	preventing rcu_barrier_cpu_count from prematurely reaching zero.
+
+	Currently, -rt implementations of RCU keep but a single global
+	queue for RCU callbacks, and thus do not suffer from this
+	problem. However, when the -rt RCU eventually does have per-CPU
+	callback queues, things will have to change. One simple change
+	is to add an rcu_read_lock() before line 8 of rcu_barrier()
+	and an rcu_read_unlock() after line 8 of this same function. If
+	you can think of a better change, please let me know!
diff --git a/Documentation/bad_memory.txt b/Documentation/bad_memory.txt
new file mode 100644
index 00000000000..df841621320
--- /dev/null
+++ b/Documentation/bad_memory.txt
@@ -0,0 +1,45 @@
+March 2008
+Jan-Simon Moeller, dl9pf@gmx.de
+
+
+How to deal with bad memory e.g. reported by memtest86+ ?
+#########################################################
+
+There are three possibilities I know of:
+
+1) Reinsert/swap the memory modules
+
+2) Buy new modules (best!) or try to exchange the memory
+   if you have spare-parts
+
+3) Use BadRAM or memmap
+
+This Howto is about number 3) .
+
+
+BadRAM
+######
+BadRAM is the actively developed and available as kernel-patch
+here:  http://rick.vanrein.org/linux/badram/
+
+For more details see the BadRAM documentation.
+
+memmap
+######
+
+memmap is already in the kernel and usable as kernel-parameter at
+boot-time.  Its syntax is slightly strange and you may need to
+calculate the values by yourself!
+
+Syntax to exclude a memory area (see kernel-parameters.txt for details):
+memmap=<size>$<address>
+
+Example: memtest86+ reported here errors at address 0x18691458, 0x18698424 and
+         some others. All had 0x1869xxxx in common, so I chose a pattern of
+         0x18690000,0xffff0000.
+
+With the numbers of the example above:
+memmap=64K$0x18690000
+ or
+memmap=0x10000$0x18690000
+
diff --git a/Documentation/development-process/4.Coding b/Documentation/development-process/4.Coding
index 014aca8f14e..a5a3450faaa 100644
--- a/Documentation/development-process/4.Coding
+++ b/Documentation/development-process/4.Coding
@@ -375,10 +375,10 @@ say, this can be a large job, so it is best to be sure that the
 justification is solid.
 
 When making an incompatible API change, one should, whenever possible,
-ensure that code which has not been updated is caught by the compiler.  
+ensure that code which has not been updated is caught by the compiler.
 This will help you to be sure that you have found all in-tree uses of that
 interface.  It will also alert developers of out-of-tree code that there is
 a change that they need to respond to.  Supporting out-of-tree code is not
 something that kernel developers need to be worried about, but we also do
-not have to make life harder for out-of-tree developers than it it needs to
-be. 
+not have to make life harder for out-of-tree developers than it needs to
+be.