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Message-ID: <20151015012226.GC14305@fixme-laptop.cn.ibm.com>
Date: Thu, 15 Oct 2015 09:22:26 +0800
From: Boqun Feng <boqun.feng@...il.com>
To: "Paul E. McKenney" <paulmck@...ux.vnet.ibm.com>
Cc: Peter Zijlstra <peterz@...radead.org>,
linux-kernel@...r.kernel.org, linuxppc-dev@...ts.ozlabs.org,
Ingo Molnar <mingo@...nel.org>,
Benjamin Herrenschmidt <benh@...nel.crashing.org>,
Paul Mackerras <paulus@...ba.org>,
Michael Ellerman <mpe@...erman.id.au>,
Thomas Gleixner <tglx@...utronix.de>,
Will Deacon <will.deacon@....com>,
Waiman Long <waiman.long@...com>,
Davidlohr Bueso <dave@...olabs.net>, stable@...r.kernel.org
Subject: Re: [PATCH tip/locking/core v4 1/6] powerpc: atomic: Make *xchg and
*cmpxchg a full barrier
On Thu, Oct 15, 2015 at 08:53:21AM +0800, Boqun Feng wrote:
> On Wed, Oct 14, 2015 at 02:44:53PM -0700, Paul E. McKenney wrote:
> > On Wed, Oct 14, 2015 at 11:04:19PM +0200, Peter Zijlstra wrote:
> > > On Wed, Oct 14, 2015 at 01:19:17PM -0700, Paul E. McKenney wrote:
> > > > Suppose we have something like the following, where "a" and "x" are both
> > > > initially zero:
> > > >
> > > > CPU 0 CPU 1
> > > > ----- -----
> > > >
> > > > WRITE_ONCE(x, 1); WRITE_ONCE(a, 2);
> > > > r3 = xchg(&a, 1); smp_mb();
> > > > r3 = READ_ONCE(x);
> > > >
> > > > If xchg() is fully ordered, we should never observe both CPUs'
> > > > r3 values being zero, correct?
> > > >
> > > > And wouldn't this be represented by the following litmus test?
> > > >
> > > > PPC SB+lwsync-RMW2-lwsync+st-sync-leading
> > > > ""
> > > > {
> > > > 0:r1=1; 0:r2=x; 0:r3=3; 0:r10=0 ; 0:r11=0; 0:r12=a;
> > > > 1:r1=2; 1:r2=x; 1:r3=3; 1:r10=0 ; 1:r11=0; 1:r12=a;
> > > > }
> > > > P0 | P1 ;
> > > > stw r1,0(r2) | stw r1,0(r12) ;
> > > > lwsync | sync ;
> > > > lwarx r11,r10,r12 | lwz r3,0(r2) ;
> > > > stwcx. r1,r10,r12 | ;
> > > > bne Fail0 | ;
> > > > mr r3,r11 | ;
> > > > Fail0: | ;
> > > > exists
> > > > (0:r3=0 /\ a=2 /\ 1:r3=0)
> > > >
> > > > I left off P0's trailing sync because there is nothing for it to order
> > > > against in this particular litmus test. I tried adding it and verified
> > > > that it has no effect.
> > > >
> > > > Am I missing something here? If not, it seems to me that you need
> > > > the leading lwsync to instead be a sync.
>
> I'm afraid more than that, the above litmus also shows that
>
I mean there will be more things we need to fix, perhaps even smp_wmb()
need to be sync then..
Regards,
Boqun
> CPU 0 CPU 1
> ----- -----
>
> WRITE_ONCE(x, 1); WRITE_ONCE(a, 2);
> r3 = xchg_release(&a, 1); smp_mb();
> r3 = READ_ONCE(x);
>
> (0:r3 == 0 && 1:r3 == 0 && a == 2) is not prohibitted
>
> in the implementation of this patchset, which should be disallowed by
> the semantics of RELEASE, right?
>
> And even:
>
> CPU 0 CPU 1
> ----- -----
>
> WRITE_ONCE(x, 1); WRITE_ONCE(a, 2);
> smp_store_release(&a, 1); smp_mb();
> r3 = READ_ONCE(x);
>
> (1:r3 == 0 && a == 2) is not prohibitted
>
> shows by:
>
> PPC weird-lwsync
> ""
> {
> 0:r1=1; 0:r2=x; 0:r3=3; 0:r12=a;
> 1:r1=2; 1:r2=x; 1:r3=3; 1:r12=a;
> }
> P0 | P1 ;
> stw r1,0(r2) | stw r1,0(r12) ;
> lwsync | sync ;
> stw r1,0(r12) | lwz r3,0(r2) ;
> exists
> (a=2 /\ 1:r3=0)
>
>
> Please find something I'm (or the tool is) missing, maybe we can't use
> (a == 2) as a indication that STORE on CPU 1 happens after STORE on CPU
> 0?
>
> And there is really something I find strange, see below.
>
> > >
> > > So the scenario that would fail would be this one, right?
> > >
> > > a = x = 0
> > >
> > > CPU0 CPU1
> > >
> > > r3 = load_locked (&a);
> > > a = 2;
> > > sync();
> > > r3 = x;
> > > x = 1;
> > > lwsync();
> > > if (!store_cond(&a, 1))
> > > goto again
> > >
> > >
> > > Where we hoist the load way up because lwsync allows this.
> >
> > That scenario would end up with a==1 rather than a==2.
> >
> > > I always thought this would fail because CPU1's store to @a would fail
> > > the store_cond() on CPU0 and we'd do the 'again' thing, re-issuing the
> > > load and now seeing the new value (2).
> >
> > The stwcx. failure was one thing that prevented a number of other
> > misordering cases. The problem is that we have to let go of the notion
> > of an implicit global clock.
> >
> > To that end, the herd tool can make a diagram of what it thought
> > happened, and I have attached it. I used this diagram to try and force
> > this scenario at https://www.cl.cam.ac.uk/~pes20/ppcmem/index.html#PPC,
> > and succeeded. Here is the sequence of events:
> >
> > o Commit P0's write. The model offers to propagate this write
> > to the coherence point and to P1, but don't do so yet.
> >
> > o Commit P1's write. Similar offers, but don't take them up yet.
> >
> > o Commit P0's lwsync.
> >
> > o Execute P0's lwarx, which reads a=0. Then commit it.
> >
> > o Commit P0's stwcx. as successful. This stores a=1.
> >
> > o Commit P0's branch (not taken).
> >
>
> So at this point, P0's write to 'a' has propagated to P1, right? But
> P0's write to 'x' hasn't, even there is a lwsync between them, right?
> Doesn't the lwsync prevent this from happening?
>
> If at this point P0's write to 'a' hasn't propagated then when?
>
> Regards,
> Boqun
>
> > o Commit P0's final register-to-register move.
> >
> > o Commit P1's sync instruction.
> >
> > o There is now nothing that can happen in either processor.
> > P0 is done, and P1 is waiting for its sync. Therefore,
> > propagate P1's a=2 write to the coherence point and to
> > the other thread.
> >
> > o There is still nothing that can happen in either processor.
> > So pick the barrier propagate, then the acknowledge sync.
> >
> > o P1 can now execute its read from x. Because P0's write to
> > x is still waiting to propagate to P1, this still reads
> > x=0. Execute and commit, and we now have both r3 registers
> > equal to zero and the final value a=2.
> >
> > o Clean up by propagating the write to x everywhere, and
> > propagating the lwsync.
> >
> > And the "exists" clause really does trigger: 0:r3=0; 1:r3=0; [a]=2;
> >
> > I am still not 100% confident of my litmus test. It is quite possible
> > that I lost something in translation, but that is looking less likely.
> >
> > > > Of course, if I am not missing something, then this applies also to the
> > > > value-returning RMW atomic operations that you pulled this pattern from.
> > > > If so, it would seem that I didn't think through all the possibilities
> > > > back when PPC_ATOMIC_EXIT_BARRIER moved to sync... In fact, I believe
> > > > that I worried about the RMW atomic operation acting as a barrier,
> > > > but not as the load/store itself. :-/
> > >
> > > AARGH64 does something very similar; it does something like:
> > >
> > > ll
> > > ...
> > > sc-release
> > >
> > > mb
> > >
> > > Which I assumed worked for the same reason, any change to the variable
> > > would fail the sc, and we go for round 2, now observing the new value.
> >
> > I have to defer to Will on this one. You are right that ARM and PowerPC
> > do have similar memory models, but there are some differences.
> >
> > Thanx, Paul
>
>
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