Correctness of short cut fusion

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Short cut fusion

Short cut fusion allows elimination of intermediate data structures using rewrite rules that can also be performed automatically during compilation.

The two most popular instances are the foldr/build- and the destroy/unfoldr-rule for Haskell lists.

foldr/build

The foldr/build-rule eliminates intermediate lists produced by build and consumed by foldr, where these functions are defined as follows: 

foldr :: (a -> b -> b) -> b -> [a] -> b
foldr c n []     = n
foldr c n (x:xs) = c x (foldr c n xs)

build :: (forall b. (a -> b -> b) -> b -> b) -> [a]
build g = g (:) []

Note the rank-2 polymorphic type of build.

The foldr/build-rule now means the following replacement for appropriately typed g, c, and n: 

foldr c n (build g) → g c n

destroy/unfoldr

The destroy/unfoldr-rule eliminates intermediate lists produced by unfoldr and consumed by destroy, where these functions are defined as follows: 

destroy :: (forall b. (b -> Maybe (a,b)) -> b -> c) -> [a] -> c
destroy g = g step

step :: [a] -> Maybe (a,[a])
step []     = Nothing
step (x:xs) = Just (x,xs)

unfoldr :: (b -> Maybe (a,b)) -> b -> [a]
unfoldr p e = case p e of Nothing     -> []
                          Just (x,e') -> x:unfoldr p e'

Note the rank-2 polymorphic type of destroy.

The destroy/unfoldr-rule now means the following replacement for appropriately typed g, p, and e: 

destroy g (unfoldr p e) → g p e

Correctness

If the foldr/build- and the destroy/unfoldr-rule are to be automatically performed during compilation, as is possible using GHC's RULES pragmas, we clearly want them to be equivalences. That is, the left- and right-hand sides should be semantically the same for each instance of either rule. Unfortunately, this is not so in Haskell.

We can distinguish two situations, depending on whether g is defined using seq or not.

In the absence of seq

foldr/build

If g does not use seq, then the foldr/build-rule really is a semantic equivalence, that is, it holds that 

foldr c n (build g) = g c n

The two sides are interchangeable in any program without affecting semantics.

destroy/unfoldr

The destroy/unfoldr-rule, however, is not a semantic equivalence. To see this, consider the following instance: 

g = \x y -> case x y of Just z -> 0
p = \x -> if x==0 then Just undefined else Nothing
e = 0

These values have appropriate types for being used in the destroy/unfoldr-rule. But with them, that rule's left-hand side "evaluates" as follows: 

destroy g (unfoldr p e) = g step (unfoldr p e)
                        = case step (unfoldr p e) of Just z -> 0
                        = case step (case p e of Nothing     -> []
                                                 Just (x,e') -> x:unfoldr p e') of Just z -> 0
                        = case step (case Just undefined of Nothing     -> []
                                                            Just (x,e') -> x:unfoldr p e') of Just z -> 0
                        = undefined

while its right-hand side "evaluates" as follows: 

g p e = case p e of Just z -> 0
      = case Just undefined of Just z -> 0
      = 0

Thus, by applying the destroy/unfoldr-rule, a nonterminating (or otherwise failing) program can be transformed into a safely terminating one. The obvious questions now are:

  1. Can the converse also happen, that is, can a safely terminating program be transformed into a failing one?
  2. Can a safely terminating program be transformed into another safely terminating one that gives a different value as result?

There is no formal proof yet, but strong evidence supporting the conjecture that the answer to both questions is "No!".

The conjecture goes that if g does not use seq, then the destroy/unfoldr-rule is a semantic approximation from left to right, that is, it holds that 

destroy g (unfoldr p e) ⊑ g p e

What is known is that semantic equivalence can be recovered here by putting moderate restrictions on p. More precisely, if g does not use seq and p is a strict function that never returns Just ⊥ (where ⊥ denotes any kind of failure or nontermination), then indeed: 

destroy g (unfoldr p e) = g p e

In the presence of seq

This is the more interesting setting, given that in Haskell there is no way to restrict the use of seq, so in any given program we must be prepared for the possibility that the g appearing in the foldr/build- or the destroy/unfoldr-rule is defined using seq. Unsurprisingly, it is also the setting in which more can go wrong than above.

foldr/build

In the presence of seq, the foldr/build-rule is not necessarily a semantic equivalence. The instance 

g = seq
c = undefined
n = 0

shows, via similar "evaluations" as above, that the right-hand side (g c n) can be strictly less defined than the left-hand side (foldr c n (build g)).

The converse cannot happen, because the following always holds: 

foldr c n (build g) ⊒ g c n

Moreover, semantic equivalence can again be recovered by putting restrictions on the involved functions.

On the consumption side, if (c ⊥ ⊥) ≠ ⊥ and n ≠ ⊥, then even in the presence of seq: 

foldr c n (build g) = g c n

On the production side, seq can be used safely as long as it is never used to force anything whose type build expects to be polymorphic. In particular, the function passed to build must not force either of its arguments, and must not force anything constructed using them. For example, in 

f x = build (\c n -> x `seq` (x `c` n))

The usual equivalence holds, regardless of c and n: 

fold c n (f x) = x `seq` (x `c` n)

For a more interesting example, we can define 

hyloList f q c n =
  case f q of
    Nothing     -> n
    Just (x,q') -> x `c` hyloList f q' c n

unfoldr f q = build (hyloList f q)

Note that if f or q uses seq, then that will appear in the argument to build, but that is still safe because f and q have no way to get their hands on c, n, or anything built from them.

destroy/unfoldr

Contrary to the situation without seq, now also the destroy/unfoldr-rule may decrease the definedness of a program. This is witnessed by the following instance: 

g = \x y -> seq x 0
p = undefined
e = 0

Here the left-hand side of the rule (destroy g (unfoldr p e)) yields 0, while the right-hand side (g p e) yields undefined.

Conditions for semantic approximation in either direction can be given as follows.

If p ≠ ⊥ and (p ⊥) ∈ {⊥, Just ⊥}, then: 

destroy g (unfoldr p e) ⊑ g p e

If p is strict and total and never returns Just ⊥, then: 

destroy g (unfoldr p e) ⊒ g p e

Of course, conditions for semantic equivalence can be obtained by combining the two laws above.

Discussion

Correctness of short cut fusion is not just an academic issue. All recent versions of GHC (at least 6.0 - 6.6) automatically perform transformations like foldr/build during their optimization pass (also in the disguise of more specialized rules such as head/build). The rules are specified in the GHC.Base and GHC.List modules. There has been at least one occasion where, as a result, a safely terminating program was turned into a failing one "in the wild", with a less artificial example than the ones given above.

foldr/build

As pointed out above, everything is fine with foldr/build in the absence of seq. If the producer (build g) of the intermediate list may be defined using seq, then the conditions (c ⊥ ⊥) ≠ ⊥ and n ≠ ⊥ better be satisified, lest the compiler transform a perfectly fine program into a failing one.

The mentioned conditions are equivalent to requiring that the consumer (foldr c n) is a total function, that is, maps non-⊥ lists to a non-⊥ value. It is thus relatively easy to identify whether a list consumer defined in terms of foldr is eligible for foldr/build-fusion in the presence of seq or not. For example, the Prelude functions head and sum are generally not, while map is.

There is, however, currently no way to detect automatically, inside the compiler, whether a particular instance of foldr/build-fusion is safe, i.e., whether the producer avoids seq or the consumer is total.

destroy/unfoldr

As above, the compiler cannot figure out automatically whether (and how) a given instance of destroy/unfoldr-fusion will change the semantics of a program.

An easy way to get rid of the condition regarding p never returning Just ⊥ is to slightly change the definitions of the functions involved: 

data Step a b = Done | Yield a b

destroy' :: (forall b. (b -> Step a b) -> b -> c) -> [a] -> c
destroy' g = g step'

step' :: [a] -> Step a [a]
step' []     = Done 
step' (x:xs) = Yield x xs

unfoldr' :: (b -> Step a b) -> b -> [a]
unfoldr' p e = case p e of Done       -> []
                           Yield x e' -> x:unfoldr' p e'

The new type Step a b is almost isomorphic to Maybe (a,b), but avoids the "junk value" Just ⊥. This change does not affect the expressiveness of unfoldr or unfoldr' with respect to list producers. But it allows some of the laws above to be simplified a bit.

We would still have that if g does not use seq, then: 

destroy g' (unfoldr' p e) ⊑ g p e

Moreover, if g does not use seq and p is strict, then even: 

destroy' g (unfoldr' p e) = g p e

In the potential presence of seq, if p ≠ ⊥ and p is strict, then: 

destroy' g (unfoldr' p e) ⊑ g p e

Also without restriction regarding seq, if p is strict and total, then: 

destroy' g (unfoldr' p e) ⊒ g p e

The worst change in program behavior from a complier user's point of view is when, through application of "optimization" rules, a safely terminating program is transformed into a failing one or one delivering a different result. This can happen in the presence of seq, for example with a producer of the form 

repeat x = unfoldr (\y -> Just (x,y)) undefined

or 

repeat x = unfoldr' (\y -> Yield x y) undefined

Fortunately, it cannot happen for any producer of a nonempty, spine-total list (i.e., one that contains at least one element and ends with []). The reason is that for any such producer expressed via unfoldr or unfoldr' the conditions imposed on p in the left-to-right approximation laws above are necessarily fulfilled.

A left-to-right approximation as in 

destroy g (unfoldr p e) ⊑ g p e

under suitable preconditions might be acceptable in practice. After all, it only means that the transformed program may be "more terminating" than the original one, but not less so.

If one insists on semantic equivalence rather than approximation, then the conditions imposed on the producer of the intermediate list become quite severe, in particular in the potential presence of seq. For example, the following producer has to be outlawed then: 

enumFromTo n m = unfoldr (\i -> if i>m then Nothing else Just (i,i+1)) n

Literature

Various parts of the above story, and elaborations thereof, are also told in the following papers:

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