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SubjectRe: [RFC][PATCH 1/5] mm: Rework {set,clear,mm}_tlb_flush_pending()
On Fri, Jul 28, 2017 at 07:45:33PM +0200, Peter Zijlstra wrote:
> On Fri, Jun 09, 2017 at 03:45:54PM +0100, Will Deacon wrote:
> > On Wed, Jun 07, 2017 at 06:15:02PM +0200, Peter Zijlstra wrote:
> > > Commit:
> > >
> > > af2c1401e6f9 ("mm: numa: guarantee that tlb_flush_pending updates are visible before page table updates")
> > >
> > > added smp_mb__before_spinlock() to set_tlb_flush_pending(). I think we
> > > can solve the same problem without this barrier.
> > >
> > > If instead we mandate that mm_tlb_flush_pending() is used while
> > > holding the PTL we're guaranteed to observe prior
> > > set_tlb_flush_pending() instances.
> > >
> > > For this to work we need to rework migrate_misplaced_transhuge_page()
> > > a little and move the test up into do_huge_pmd_numa_page().
> > >
> > > Cc: Mel Gorman <mgorman@suse.de>
> > > Cc: Rik van Riel <riel@redhat.com>
> > > Signed-off-by: Peter Zijlstra (Intel) <peterz@infradead.org>
> > > ---
> > > --- a/include/linux/mm_types.h
> > > +++ b/include/linux/mm_types.h
> > > @@ -527,18 +527,16 @@ static inline cpumask_t *mm_cpumask(stru
> > > */
> > > static inline bool mm_tlb_flush_pending(struct mm_struct *mm)
> > > {
> > > - barrier();
> > > + /*
> > > + * Must be called with PTL held; such that our PTL acquire will have
> > > + * observed the store from set_tlb_flush_pending().
> > > + */
> > > return mm->tlb_flush_pending;
> > > }
> > > static inline void set_tlb_flush_pending(struct mm_struct *mm)
> > > {
> > > mm->tlb_flush_pending = true;
> > > -
> > > - /*
> > > - * Guarantee that the tlb_flush_pending store does not leak into the
> > > - * critical section updating the page tables
> > > - */
> > > - smp_mb__before_spinlock();
> > > + barrier();
> >
> > Why do you need the barrier() here? Isn't the ptl unlock sufficient?
>
> So I was going through these here patches again, and wrote the
> following comment:
>
> static inline void set_tlb_flush_pending(struct mm_struct *mm)
> {
> mm->tlb_flush_pending = true;
> /*
> * The only time this value is relevant is when there are indeed pages
> * to flush. And we'll only flush pages after changing them, which
> * requires the PTL.
> *
> * So the ordering here is:
> *
> * mm->tlb_flush_pending = true;
> * spin_lock(&ptl);
> * ...
> * set_pte_at();
> * spin_unlock(&ptl);
> *
> *
> * spin_lock(&ptl)
> * mm_tlb_flush_pending();
> * ....
> * spin_unlock(&ptl);
> *
> * flush_tlb_range();
> * mm->tlb_flush_pending = false;
> */
> }
>
> And while the ptl locks are indeed sufficient to constrain the true
> assignment, what constrains the false assignment? As in the above there
> is nothing stopping the false from ending up visible at
> mm_tlb_flush_pending().
>
> Or does flush_tlb_range() have implicit ordering? It does on x86, but is
> this generally so?

Looks like that's what's currently relied upon:

/* Clearing is done after a TLB flush, which also provides a barrier. */

It also provides barrier semantics on arm/arm64. In reality, I suspect
all archs have to provide some order between set_pte_at and flush_tlb_range
which is sufficient to hold up clearing the flag. :/

Will

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