linux-kernel - Re: [RFC PATCH] introduce sys_membarrier(): process-wide memory barrier

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Message-ID: <1262900140.28171.3773.camel@gandalf.stny.rr.com>
Date:	Thu, 07 Jan 2010 16:35:40 -0500
From:	Steven Rostedt <rostedt@...dmis.org>
To:	paulmck@...ux.vnet.ibm.com
Cc:	Oleg Nesterov <oleg@...hat.com>,
	Peter Zijlstra <peterz@...radead.org>,
	Mathieu Desnoyers <mathieu.desnoyers@...ymtl.ca>,
	linux-kernel@...r.kernel.org, Ingo Molnar <mingo@...e.hu>,
	akpm@...ux-foundation.org, josh@...htriplett.org,
	tglx@...utronix.de, Valdis.Kletnieks@...edu, dhowells@...hat.com,
	laijs@...fujitsu.com, dipankar@...ibm.com
Subject: Re: [RFC PATCH] introduce sys_membarrier(): process-wide memory
 barrier

On Thu, 2010-01-07 at 12:58 -0800, Paul E. McKenney wrote:

> I believe that I am worried about a different scenario.  I do not believe
> that the scenario you lay out above can actually happen.  The pair of
> schedules on CPU 2 have to act as a full memory barrier, otherwise,
> it would not be safe to resume a task on some other CPU.

I'm not so sure about that. The update of ->curr happens inside a
spinlock, which is a rmb() ... wmb() pair. Must be, because a spin_lock
must be an rmb otherwise the loads could move outside the lock, and the
spin_unlock must be a wmb() otherwise what was written could move
outside the lock.


>   If the pair
> of schedules act as a full memory barrier, then the code in
> synchronize_rcu() that looks at the RCU read-side state would see that
> CPU 2 is in an RCU read-side critical section.
> 
> The scenario that I am (perhaps wrongly) concerned about is enabled by
> the fact that URCU's rcu_read_lock() has a load, some checks, and a store.
> It has compiler constraints, but no hardware memory barriers.  This
> means that CPUs (even x86) can execute an rcu_dereference() before the
> rcu_read_lock()'s store has executed.
> 
> Hacking your example above, keeping mind that x86 can reorder subsequent
> loads to precede prior stores:
> 
> 
> 	CPU 1				CPU 2
>      -----------                    -------------
> 
> 	<user space>			<kernel space, switching to task>
> 
> 					->curr updated
> 
> 					<long code path, maybe mb?>
> 
> 					<user space>
> 
> 					rcu_read_lock(); [load only]
> 
> 					obj = list->next
> 
> 	list_del(obj)
> 
> 	sys_membarrier();
> 	< kernel space >

Well, if we just grab the task_rq(task)->lock here, then we should be
OK? We would guarantee that curr is either the task we want or not.

> 
> 	if (task_rq(task)->curr != task)
> 	< but load to obj reordered before store to ->curr >
> 
> 	< user space >
> 
> 	< misses that CPU 2 is in rcu section >
> 
> 	[CPU 2's ->curr update now visible]
> 
> 	[CPU 2's rcu_read_lock() store now visible]
> 
> 	free(obj);
> 
> 					use_object(obj); <=== crash!
> 
> 
> 
> If the "long code path" happens to include a full memory barrier, or if it
> happens to be long enough to overflow CPU 2's store buffer, then the
> above scenario cannot happen.  Until such time as someone applies some
> unforeseen optimization to the context-switch path.
> 
> And, yes, the context-switch path has to have a full memory barrier
> somewhere, but that somewhere could just as easily come before the
> update of ->curr.

Hmm, since ->curr is updated before sched_mm() I'm thinking it would
have to be after the update of curr.

> 
> The same scenario applies when using ->cpu_vm_mask instead of ->curr.
> 
> Now, I could easily believe that the current context-switch code has
> sufficient atomic operations, memory barriers, and instructions to
> prevent this scenario from occurring, but it is feeling a lot like an
> accident waiting to happen.  Hence my strident complaints.  ;-)

I'm totally with you on this. I really want a good understanding of what
can go wrong, and show that we have the necessary infrastructure to
prevent it.

-- Steve


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