# Fox & Hounds

Fox & Hounds is a simple two-player game played on the light squares of a chessboard. Here is the initial position with the position of the fox marked by F, the position of the hounds marked by H, and the empty light squares marked by * symbols:

```Fox to move
+--------+
|* * F * |
| * * * *|
|* * * * |
| * * * *|
|* * * * |
| * * * *|
|* * * * |
| H H H H|
+--------+
```

The fox moves first, and can move to any empty diagonally adjacent square. When it is the hounds’ turn to move one hound is chosen to move to an empty diagonally adjacent square, but hounds can only move up the board. The hounds win by blocking the fox so it can’t move:

```Fox to move
+--------+
|* F H * |
| H H * *|
|* * H * |
| * * * *|
|* * * * |
| * * * *|
|* * * * |
| * * * *|
+--------+
```

The fox wins by escaping from the hounds, which is simplest to define as positions in which it is the hounds’ turn to move but no hound can move:

```Hounds to move
+--------+
|H * H H |
| * * * *|
|* * * * |
| * * * *|
|* * * F |
| * * * H|
|* * * * |
| * * * *|
+--------+
```

However, in practice as soon as the fox gets around the hounds it is easy (and boring) for the fox to make waiting moves until the hounds run out of moves, so we expand our definition of winning positions for the fox to include positions where the fox has escaped into an area of two or more squares that no hound can ever reach:

```Hounds to move
+--------+
|* * * * |
| * * * *|
|* * * * |
| H * H *|
|* * * * |
| F H H *|
|* * * * |
| * * * *|
+--------+
```

The area needs to have at least two squares so the fox can make waiting moves while the hounds exhaust all their moves. Now, before polluting your intuition by reading the following analysis, I recommend getting a feeling for the game on your own terms by playing a few rounds as the fox and as the hounds.

### Solving the Game

If you’re like me there are only so many times you can play this game without needing to know who wins with perfect play, and fortunately it is feasible to compute this with the following algorithm:

1. Compute the set of reachable positions from the initial position.
2. Annotate each reachable position where the fox has won as Fox win in 0 and each reachable position where the hounds have won as Hounds win in 0.
3. Order the possible position evaluations like so:
Hounds win in 0 < Hounds win in 1 < Hounds win in 2 < ··· < Fox win in 2 < Fox win in 1 < Fox win in 0
4. For every reachable position where all the next positions have been annotated with an evaluation, if it is the fox’ turn to move then pick the maximum evaluation, and if it is the hounds’ turn to move then pick the minimum evaluation. In both cases increment the N in the win in N part of the evaluation and annotate the position with this adjusted evaluation.

This is an example of dynamic programming, and its computational complexity depends on the number of reachable positions, not the number of possible games. This is usually a huge speed-up: for example, in the classic game of noughts and crosses there are 5,478 reachable positions but 255,168 possible games.

This algorithm is coded in the solve Haskell package, and here is the result of running it on a range of possible board sizes:

 Board size Reachable positions Possible games Initial position evaluation Time Memory 2×2 1 1 Hounds win in 0 1s 200Mb 4×4 83 178 Hounds win in 8 1s 200Mb 6×6 8,175 ~1011 Fox win in 21 2s 200Mb 8×8 709,868 ~1029 Hounds win in 44 3m 650Mb 10×10 69,575,678 ~1055 Hounds win in 72 8h 41Gb

The performance results were gathered using GHC version 8.0.1 on an Intel(R) Xeon(R) Gold 6136 CPU @ 3.00GHz. The exact number of possible games for Fox & Hounds played on a standard 8×8 board is 360,552,037,329,667,882,019,232,833,884. If you’re wondering why the hounds win in zero moves on a 2×2 board, it is because the poor fox is already trapped in the initial position:

```Fox to move
+--+
|F |
| H|
+--+
```

### Designing an AI Player

Once the game was solved, my plan was to use the solution to create a strong Fox & Hounds AI player on a standard 8×8 board. And indeed, when faced with a winning position, the game solution does make it easy for an AI player to win the game. But what should an AI player do when faced with a losing position? For example, when playing as the fox from the initial position?

When faced with a hard problem, my mathematician instincts tell me to solve an easier problem instead. So let’s begin with the problem of how to play as the hounds in a losing position. To make the discussion more concrete, consider the first reachable position that is losing for the hounds, which we call the opposite position:

```Fox to move
+--------+
|* * * * |
| * F * *|
|* * * * |
| * * * *|
|* * * * |
| * * * *|
|* * * H |
| H H * H|
+--------+
Evaluation: Fox win in 29
```

Hounds opening tip: don’t play this as your first move! Observe that this is a win in 29 moves for the fox, so with best play the hounds can delay defeat for a long time. Since the game stops as soon as the fox escapes, the N in the evaluation Fox win in N is a useful positional measure, and we use this to design a strategy for the hounds in a losing position: the AI player simply plays to delay defeat as long as possible. This same strategy is also used in solved chess endgames to create AI players that are hard to defeat when defending lost endgames such as Queen vs Rook. Try it for yourself on the opposite position, or this tricky position that is also losing for the hounds.

### What Does the Fox Play?

So much for the easier problem. Unfortunately, the same strategy does not result in a strong fox AI player when playing in a losing position, but the reason why is instructive. Most games that the hounds win take about the same number of moves, because all the hounds have to move all the way up the board to trap the fox. Thus a fox playing to delay defeat will stay away from the hounds to avoid any early traps, and wait for the hounds to simply march up the board in a line for an easy win.

This last part contains the kernel of an idea for a fox strategy. First, call a position a FoxBox if the fox is contained by the hounds, such as the initial position or any of the following:

```+--------+    +--------+    +--------+
|* * * * |    |* * H * |    |H * H F |
| * F * *|    | F * * *|    | * * H *|
|* * * * |    |* * H * |    |* * * H |
| * * * *|    | H H * *|    | * * * *|
|* * H H |    |* * * * |    |* * * * |
| H H * *|    | * * * *|    | * * * *|
|* * * * |    |* * * * |    |* * * * |
| * * * *|    | * * * *|    | * * * *|
+--------+    +--------+    +--------+
```

A simple strategy for the hounds is to play moves that maintain FoxBox positions whenever possible, and if the fox forces a non-FoxBox position then return to a FoxBox position at the earliest opportunity. Thus, when the fox is faced with a losing position, to make winning the game as complicated as possible for the hounds, the fox should avoid FoxBox positions.

The dynamic programming technique can be repeated to calculate the number of moves B required for the hounds to force a FoxBox position. Since every won position for the hounds is a FoxBox position, the B value will be finite in every position that is losing for the fox. Unfortunately, when used as a positional measure, the B value offers no guidance for the fox in FoxBox positions (such as the initial position).

A better positional measure is the maximum B value that the fox can force over the course of the whole game starting from the current position, and this can be calculated by dynamic programming yet again. When playing as the fox in a losing position, the strategy of the AI player is to maximize this quantity, which will hopefully lead to a position far from a FoxBox in which the hounds will make a mistake. For example, the B value in the initial position is 0, because it is already a FoxBox position, but the maximum value that the fox can force over the course of the game is 6, and this provides the motivation for the fox to start harassing the hounds as soon as possible.

### The Fairest Fuzz Factor

At this point we have defined the strategy of the AI player when playing in a losing position as the fox or the hounds. To make the game interesting, when playing in a winning position the AI player also plays to maximize the same quantity as the losing side, but restricted to moves that preserve the win. Thus, when playing as the fox in a winning position, the AI plays toward the longest possible victory, and when playing as the hounds in a winning position, the AI plays toward the maximum finite B value.

The AI player also includes a fuzz factor to make the game more interesting: with probability p it does not follow its defined strategy but instead picks a move at random from the available moves. With the addition of a fuzz factor p > 0 a fox can now win from the initial position against an AI player, and using dynamic programming (of course) it is possible to calculate the probability of this happening as a function of p if it plays according to an optimal strategy. Using binary search on p the fairest fuzz factor for the AI player is determined to be p = 0.006935, which gives the fox exactly 50% chance of winning:

 Fuzz factor (p) Fox wins from initial position Hounds win from opposite position 0.000000 0.000 0.000 0.003906 0.326 0.150 0.005859 0.444 0.215 0.006836 0.495 0.245 0.006897 0.498 0.247 0.006927 0.499 0.248 0.006935 0.500 0.248 0.006943 0.500 0.249 0.006958 0.501 0.249 0.007080 0.507 0.253 0.007324 0.518 0.260 0.007812 0.541 0.275 0.015625 0.780 0.466 0.031250 0.943 0.696 0.062500 0.995 0.890 0.125000 1.000 0.979 0.250000 1.000 0.997 0.500000 1.000 0.998 1.000000 1.000 0.999

Just for fun, the table also includes the probability that the hounds win from the opposite position against a fox AI player with the given fuzz factor.

### Conclusion

After solving the game, I was able to answer any question I had about the game with modest programming effort. The hardest part of constructing a strong fox AI player for losing positions was coming up with good questions to ask starting with the concept of the FoxBox. And perhaps there are better questions to ask that would result in stronger Fox & Hounds AI players. There is a lesson here for our Big Data future: even when all the data on a problem domain is available, creative work is still needed to solve real-world problems.

# The Slowest Software Development Methodology in the World

For some time now I’ve been practicing what can only be described as the slowest software development methodology in the world: a three step waltz of Prototyping, Verification and Export.

Prototyping: I begin quite normally by writing some code in Haskell, testing out different ways of solving some problem that I’m interested in. In this step I’m mainly focused on achieving a clean design with reasonable performance, and wherever possible I use existing Haskell packages (but restricted to those that have been developed with the same software development methodology). I also write QuickCheck tests to check various properties of the functions in the design. At this point I’m essentially done with the traditional coding phase, though usually I spend what might be perceived as an excessive amount of time polishing to make the design and properties as simple and clear as possible.

Verification: Next I use the HOL Light interactive theorem prover to develop a logical theory that (i) defines the types and functions in my Haskell design, and (ii) proves the QuickCheck properties as theorems that follow from the definitions. If the Haskell package depends on other packages that follow the same software development methodology then their contents must also be formalized in theories, and the logical definitions can build on each other in the same way as the Haskell definitions. This step is the most labour-intensive, and often some degree of creativity is required to formulate properties of recursive functions that can be proved by induction. This is where the effort spent polishing the prototype repays itself, since any unnecessary complexity in the design will inevitably thread its way through the proof of many properties.

Export: The final step is to use the opentheory tool to export the logical theory as a Haskell package. I first package up the HOL Light theory in OpenTheory format, by rendering its proof in a low-level article format and adding some meta-data such as the package name and the list of OpenTheory packages it depends on. There is also some Haskell-specific meta-data, such as the mapping from OpenTheory symbol names to Haskell names, and selecting which theorems should be exported as QuickCheck properties. Once that is complete the opentheory tool can automatically export the OpenTheory package as a Haskell package (in a form ready to be uploaded to Hackage).

### Why Would You Do That?

At this point you might reasonably ask: why develop a Haskell package, throw it away, and then develop a logical theory only to export the same Haskell package again? Excellent question, and the rest of this post is devoted to answering it, but let’s begin with a depressing truth: it’s not the proof. Despite the countless hours and myriad creative insights you poured into that final Q.E.D., no one wants to see or even hear about your proof. Formal verification proofs are write-only. Sorry about that.

Specification: The proofs might be irrelevant, but the proved theorems constitute a precise specification of the Haskell package, grounded all the way down to standard mathematical objects formalized in higher order logic. I view Haskell as a computational platform for higher order logic (rather than higher order logic as a verification platform for Haskell), a perspective that emphasizes the consistent set of logical theories underlying the Haskell package that defines its semantics. A practical consequence of this is that any differences in the behaviour of the Haskell package and its higher order logic semantics (for example, due to bugs in the export code) must be fixed by changing the Haskell computational platform to conform to its higher order logic semantics.

Let’s take a look at an example specification for an extended GCD function `egcd` defined in the Haskell package opentheory-divides:

`egcd :: Natural -> Natural -> (Natural, (Natural, Natural))`

The following theorem about `egcd` is one of many proved in the corresponding logical theory natural-divides:

`∀a b g s t. ¬(a = 0) ∧ egcd a b = (g,(s,t)) ⇒ t * b + g = s * a`

This says that the three components of the `egcd` result (g, s and t) will satisfy a particular equation with its arguments (a and b), so long as the first argument a is non-zero. Side-conditions like this don’t fit naturally into the Haskell type system, and so the burden falls on programmers to discover them and code around them when necessary. This may be one reason why programmers prefer to write their own software components (with side-conditions tailored to the application) rather than reuse existing components (with unknown and/or inconvenient side-conditions). Using this software development methodology I shift the burden of discovering side-conditions to HOL Light, which will force me to prove that the first argument of `egcd` is non-zero in any code that relies on the above property of the result. If the code just uses the property that the result g of `egcd` is the greatest common divisor then HOL Light will understand that no side-condition proof is necessary, because another theorem in the logical theory proves that this is true for all arguments to `egcd`:

`∀a b. fst (egcd a b) = gcd a b`

Proof: It may be surprising to learn that verified Haskell packages can be useful as a building block to formalize mathematics in higher order logic. Once we have defined Haskell types and functions in the logic and proved that they satisfy their specification, we can build on this formal development to prove mathematical theorems that do not refer to any Haskell symbols. To continue the `egcd` example, suppose we have two natural numbers a and b (b is greater than 1) that are coprime (i.e., `gcd a b = 1`). Then we can reduce modulo b both sides of the first property of `egcd` to show the existence of a multiplicative inverse for a modulo b:

`∀a b. 1 < b ∧ gcd a b = 1 ⇒ ∃s. (s * a) `mod` b = 1`

This is a non-trivial higher order logic theorem which refers only to standard mathematical concepts, but its proof rests on the properties of the verified Haskell `egcd` function.

Maintenance: Software maintenance is a pain, and it is here that this software development methodology really shines (and who knows, maybe eventually cause the tortoise to pass the hare?). Formally verified software offers a new capability: by examining the logical theory of a Haskell package, we can see exactly which properties of dependent packages it relies on. We can use this information to automatically check whether or not a new version of a dependent package will preserve functional correctness: if so then extend the acceptable version range; and if not then report an error to the maintainer. The opentheory tool uses this technique to automatically generate maximal acceptable version ranges for dependent packages whenever it exports Haskell packages, removing another cognitive burden from the programmer. Earlier I said that formal verification proofs were write-only, but really all I meant is that humans won’t read them: as this version analysis shows machines are quite happy to read them and extract useful information.

Fun: Actually I retract the whole depressing truth: it is totally about the proof. Not for showing to people (humans still won’t read formal verification proofs) but rather for the pure fun of writing them. Those myriad creative insights you made over the course of countless hours? For me formal verification is as immersive as a video game, and my high scores come with a new artefact to play with and build upon. Free toy inside!

# A Natural GCD Algorithm

The greatest common divisor (gcd) of two non-negative integers is the largest integer that divides both of them, so for example

```gcd 15 6 == 3 gcd 21 10 == 1 gcd 10 0 == 10 gcd 0 0 == 0  -- by convention```

Two numbers that have a gcd of 1 (like 21 and 10) are said to be coprime. Although in general it’s a hard problem to factor an integer into divisors

```91 == 7 * 13 69 == 3 * 13```

it’s an easy problem to compute the gcd of two integers

`gcd 91 69 == 13`

and if they are not coprime then a non-trivial divisor of both is revealed.

Here is a simple recursive definition that efficiently computes gcd:

```gcd :: Integer -> Integer -> Integer gcd a 0 = a gcd a b = gcd b (a `mod` b)```

How would we check that this definition always computes the gcd of two non-negative integers? If we define a divides relation

```divides :: Integer -> Integer -> Bool divides 0 b = b == 0 divides a b = b `mod` a == 0 ```

then we can easily test that gcd returns some common divisor:

```commonDivisorTest :: Integer -> Integer -> Bool commonDivisorTest a b = let g = gcd a b in divides g a && divides g b```

But how to check that gcd returns the greatest common divisor? Consider the linear combination g of a and b

`g = s * a + t * b`

where the coefficients s and t are arbitrary integers. Any common divisor of a and b must also be a divisor of g, and so if g is itself a common divisor of a and b then it must be the greatest common divisor. The extended gcd algorithm computes the coefficients s and t together with the gcd:

```egcd :: Integer -> Integer -> (Integer,(Integer,Integer)) egcd a 0 = (a,(1,0)) egcd a b =     (g, (t, s - (a `div` b) * t))   where     (g,(s,t)) = egcd b (a `mod` b)```

which allows us to test that egcd returns the greatest common divisor:

```greatestCommonDivisorTest :: Integer -> Integer -> Bool greatestCommonDivisorTest a b =     let (g,(s,t)) = egcd a b in     divides g a && divides g b && s * a + t * b == g```

The coefficients s and t are useful for much more than checking the gcd result: for any coprime a and b we have

```s * a + t * b == 1 (s * a) `mod` b == 1  -- assuming b > 1 (t * b) `mod` a == 1  -- assuming a > 1```

which shows that s is the multiplicative inverse of a modulo b, and t is the multiplicative inverse of b modulo a.

### Computing Over the Natural Numbers

The extended gcd algorithm is a classic integer algorithm, but what if we wanted a version that computed over the type of natural numbers? This would be useful in environments in which unsigned arithmetic is more natural and/or efficient than signed arithmetic (one such environment being the natural number theory of an interactive theorem prover, which is where this need arose).

The immediate problem is that one of the s and t coefficients returned by the extended gcd algorithm is usually a negative number, which is to be expected since they must satisfy

`s * a + t * b == g`

where g is generally less than both a and b. The solution is to modify the specification and ask for natural number coefficients s and t that satisfy

`s * a == t * b + g`

Fortunately for us, it turns out that such coefficients always exist except when a is zero (and b is non-zero).

Unfortunately for us, our modified specification is no longer symmetric in a and b. Given coprime a and b as input, s is the multiplicative inverse of a modulo b as before, but t is now the negation of the multiplicative inverse of b modulo a (the additive inverse of the multiplicative inverse—funny). This asymmetry breaks the recursion step of the extended gcd algorithm, because there is no longer a way to derive coefficients s and t satisfying

`s * a == t * b + g`

from coefficients s’ and t’ satisfying

`s' * b == t' * (a `mod` b) + g`

[If you try you’ll discover that a and b are the wrong way around.] This problem is solved by unwinding the recursion so that the algorithm makes two reductions before calling itself recursively, giving coefficients s’ and t’ satisfying

`s' * (a `mod` b) == t' * (b `mod` (a `mod` b)) + g`

Although this is expression is more complicated, it is now possible to define coefficients

```s = s' + (b `div` (a `mod` b)) * t' t = t' + (a `div` b) * s```

which satisfy the desired equation

`s * a == t * b + g`

Here is the finished implementation:

```egcd :: Natural -> Natural -> (Natural,(Natural,Natural)) egcd a 0 = (a,(1,0)) egcd a b =     if c == 0     then (b, (1, a `div` b - 1))     else (g, (u, t + (a `div` b) * u))   where     c = a `mod` b     (g,(s,t)) = egcd c (b `mod` c)     u = s + (b `div` c) * t```

This satisfies a modified test confirming that it produces a greatest common divisor (for non-zero a):

```greatestCommonDivisorTest :: Natural -> Natural -> Bool greatestCommonDivisorTest a b =     let (g,(s,t)) = egcd a b in     divides g a && divides g b && s * a == t * b + g```

And we can also check the upper bounds on the s and t coefficients (for non-zero a and b at least 2):

```coefficientBoundTest :: Natural -> Natural -> Bool coefficientBoundTest a b =     let (_,(s,t)) = egcd a b in     s < b && t < a```

### Application: The Chinese Remainder Theorem

The Chinese Remainder Theorem states that for coprime a and b, given an x and y satisfying

```x < a y < b```

there is a unique n satisfying

```n < a * b n `mod` a == x n `mod` b == y```

But how to compute this n given natural number inputs a, b, x and y? We build on the natural number extended gcd algorithm, of course:

```chineseRemainder :: Natural -> Natural -> Natural -> Natural -> Natural chineseRemainder a b =     \x y -> (x * tb + y * sa) `mod` ab   where     (_,(s,t)) = egcd a b     ab = a * b     sa = s * a     tb = (a - t) * b```

The λ expression in the body maximizes the precomputation on a and b, allowing efficient Chinese remaindering of different x and y inputs once the a and b inputs have been fixed. As with all computation over the natural numbers we must be careful with the subtraction operation `(a - t)` to ensure that the first argument is always larger than the second, but here we know from the `coefficientBoundTest` that t is always less than a.

### References

All of the natural number computations in this blog post have been formally verified and are available as the Haskell package opentheory-divides.

# Explicit Laziness

This post describes a particular technique that is useful for optimizing functional programs, which I call explicit laziness. This example came about because I needed a purely functional implementation of an infinite list of primes, to demonstrate the capabilities of exporting OpenTheory logic packages to Haskell. The Sieve of Eratosthenes is a classic algorithm to compute this, and in an imperative language can be implemented with an array where it is cheap to update elements. In translating the algorithm to a purely functional language the array data structure naturally becomes a list, where it is much cheaper to update leading elements than trailing elements. This led to the idea of using explicit laziness to minimize the number of updates to trailing elements, and the result is an improved algorithm that could be backported to speed up an imperative implementation. The price of the improvement is greater complexity, but this can be hidden inside an abstract type, and the increased verification challenge can be met by the HOL Light theorem prover which is used to generate the source logic package.

### Example Sieve Program

To illustrate the explicit laziness technique, we’ll use it to optimize an Haskell program for computing prime numbers based on a sieve method. This is the central `Sieve` data structure:

```newtype Sieve =   Sieve { unSieve :: (Natural,[(Natural,Natural)]) }```

Values of type `Natural` are non-negative integers of unbounded size. Every value `Sieve (n,ps)` of type `Sieve` must satisfy the invariant that `map fst ps` is the list of all prime numbers up to the perimeter `n` in ascending order, and the counter `k` in every element `(p,k)` of the list `ps` satisfies `k == n `mod` p`. The following examples are valid values of type `Sieve`:

• `Sieve (9,[(2,1),(3,0),(5,4),(7,2)])`
• `Sieve (10,[(2,0),(3,1),(5,0),(7,3)])`
• `Sieve (11,[(2,1),(3,2),(5,1),(7,4),(11,0)])`

The `Sieve` API supports two operations for creating new values of type Sieve:

```initial :: Sieve increment :: Sieve -> (Bool,Sieve)```

The `initial` value of a `Sieve` is simply:

```initial :: Sieve initial = Sieve (1,[])```

The `increment` operation takes a value `Sieve (n,_)` and returns a new value `Sieve (n + 1, _)`, together with a boolean indicating whether the new perimeter `n + 1` is a prime number:

```increment :: Sieve -> (Bool,Sieve) increment =   \s ->     let (n,ps) = unSieve s in     let n' = n + 1 in     let ps' = inc ps in     let b = check ps' in     let ps'' = if b then ps' ++ [(n',0)] else ps' in     (b, Sieve (n', ps''))   where     inc = map (\(p,k) -> (p, (k + 1) `mod` p))     check = all (\(_,k) -> k /= 0)```

The `increment` operation works by adding 1 to the perimeter `n <- n + 1` and every counter `k <- (k + 1) `mod` p`. It then checks whether any counter is zero, which happens when the perimeter is divisible by a known prime. If no counter is zero then the perimeter is a new prime, and so `(n,0)` is added to the end of the list.

### Motivating Explicit Laziness

How can we optimize this program? Well, there are certainly many ways that we can help the compiler produce efficient target code, but before we get into that we should consider algorithmic improvements. For example, are we performing any unnecessary computation? It seems that we are, because we increment every counter even though the boolean result only needs to know whether any counter is zero. We could stop at the first zero counter and just make a note (called a closure) that the other counters need to be incremented later. This is an instance of lazy evaluation, and since Haskell is a lazy language this optimization will be performed automatically.

Unfortunately, there is still a performance problem here. Consider a time in the future when we are incrementing counters and we come to a counter with an increment closure. At this point Haskell’s lazy evaluation will execute the closure to increment the counter, and then increment it for a second time to see whether it is zero. This is functionally correct, but it would be much more efficient to add 2 to the counter rather than add 1 and then add 1 again. Even worse, it turns out that the increment closures stack up on counters during evaluation, to the point that each time we discover a new prime `p` we have to increment the counter `k` in the final list element `(q,k)` a total of `p - q` times before we can check that it is non-zero and record the new prime.

How can we avoid this inefficient behavior of adding `m` to a counter by adding 1 to it `m` times? This is a case where Haskell’s automatic laziness is not flexible enough, because whenever evaluation encounters a value with a closure, the only possible course of action is to execute the closure and then continue evaluation. There is no way to examine the closure to find out what computation it will perform. However, we can manually simulate lazy evaluation by storing data structures together with explicit notes saying what computation needs to be done before they can be used.

### Demonstrating Explicit Laziness

Here is how explicit laziness works in our example. First, we extend the Sieve data structure as follows:

```newtype Sieve =   Sieve { unSieve :: (Natural,[(Natural,(Natural,Natural))]) }```

This is exactly the same as before, except that each list element `(p,(k,j))` has an extra natural number component `j`, which is a note that `j` must be added to every counter following this one in the list.

The definition of the `initial` value remains the same:

```initial :: Sieve initial = Sieve (1,[])```

However, the `increment` operation now takes into account the explicit `j` notes:

```increment :: Sieve -> (Bool,Sieve) increment =   \s ->     let (n,ps) = unSieve s in     let n' = n + 1 in     let (b,ps') = inc n' 1 ps in     (b, Sieve (n',ps'))   where     inc n _ [] = (True, (n,(0,0)) : [])     inc n i ((p,(k,j)) : ps) =       let k' = (k + i) `mod` p in       let j' = j + i in       if k' == 0 then (False, (p,(0,j')) : ps)       else let (b,ps') = inc n j' ps in (b, (p,(k',0)) : ps')```

The `inc` and `check` functions in the previous implementation have been combined into one `inc` function which takes a parameter `i` recording how much to increment counters. Initially `i` is set to 1, but it absorbs the `j` values for the counters it visits. As soon a zero counter is discovered, the i parameter is added to the current j value and the rest of the list is untouched. This last point is crucial: explicit laziness eliminates the overhead of closures that are normally generated to update data structures not directly required for the result. For comparison with the version of the program without explicit laziness, here are the `Sieve` values with perimeters 9, 10 and 11:

• `Sieve (9,[(2,(1,0)),(3,(0,2)),(5,(2,0)),(7,(0,0))])`
• `Sieve (10,[(2,(0,1)),(3,(0,2)),(5,(2,0)),(7,(0,0))])`
• `Sieve (11,[(2,(1,0)),(3,(2,0)),(5,(1,0)),(7,(4,0)),(11,(0,0))])`

Values of the new version of the `Sieve` type are much harder to read than values of the original version, because the `j` values have to be added to every counter following it in the list. This complicates the invariant for `Sieve` values, but is actually a measure of the efficiency gained. For example, the `j` value of 2 in the `Sieve` value with perimeter 9 line replaces 4 counter increments in the original program: 2 for the 5 counter and another 2 for the 7 counter.

### Performance Comparison

Even though explicit laziness is an algorithmic optimization, and there remain many optimizations that can be applied to both versions of the example sieve program, it is nevertheless interesting to gauge the performance effects of explicit laziness using a standard compiler. The following table presents the time taken to compute the Nth prime using both versions of the example sieve program, for various values of N:

 Nth prime 100 200 400 800 1600 3200 Without explicit laziness 0.007s 0.019s 0.068s 0.284s 1.169s 5.008s With explicit laziness 0.004s 0.008s 0.025s 0.083s 0.345s 1.495s

It is gratifying to see that the version of the example sieve program with explicit laziness is about 3x faster on this small experiment.

### Summary

In this post we have described explicit laziness, a useful technique for optimizing functional programs. Like all optimization techniques its effectiveness depends on the context: automatic laziness is more flexible and guarantees that closures will be evaluated at most once, so should be the default. However, the judicious introduction of explicit laziness can eliminate closures and allow future computations to be combined into more efficient variants before executing them (a limited form of computation on computations).

### Appendix

The code for the optimized version of the example sieve program is available at Hackage: this verified Haskell package is automatically generated from an OpenTheory package. The performance results were gathered using the GHC 7.4.1 compiler on a MacBook Air with a 1.8GHz Intel Core i7 processor and 4Gb of RAM, running OS X 10.7.5.