When implementing interpreters for languages based on the lambda-calculus one quickly moves away from naively substituting variables when evaluating function application. This is mostly due to the fact that terms can grow very big very fast, since when substituting variables for some term said term will be duplicated everywhere the variable is used.

In other words, if we have some term

`(\x -> foo x x) SomeBigTerm`

`SomeBigTerm`

will be duplicated when substituting `x`

for `SomeBigTerm`

.

The solution is to not substitute eagerly. In most languages it is quite easy to do so, for example using a CEK machine.

However, things get a bit tricky when one needs to compute
with free variables.^{1} This is the case in many dependently
typed languages, such as Agda or Coq. Agda perfomance in particular
has long suffered also because it substitutes terms too eagerly.

This problem is also relevant in other languages that need to implement higher-order unification,
such as lambda-Prolog.
The implementors of lambda-Prolog solved this problem by developing
a “suspension calculus”, which allows substitutions to be delayed
until we really need them.^{2}

The substitution calculus works with
de Bruijn indices. As
everybody who implemented algorithms involving de Bruijn indices knows,
it is *extremely* easy to make mistakes and break the invariants
required for the indices to be well-formed. The suspension calculus
is no exception, and up to now I had trouble justifying its
rewrite rules.

However, it is possible to encode what scope we’re working on at the type level, thus making operations involving de Bruijn indices much safer. This short article is about implementing the suspension calculus using the same techniques, so that we can implement its rewrite rules with much more confidence.

The article is a literate Haskell file, you can save it and load it using

```
$ stack --resolver lts-8.11 ghci
Prelude> :l suspension.lhs
```

You can also see the file on GitHub.

Let’s get started.

First of all, a few boring `LANGUAGE`

extensions and import. Most of the
imports are needed for the pretty printing and parsing, which are
not really relevant to the article.

```
{-# OPTIONS_GHC -Wall #-}
{-# LANGUAGE ExistentialQuantification #-}
{-# LANGUAGE GADTs #-}
{-# LANGUAGE LambdaCase #-}
{-# LANGUAGE StrictData #-}
{-# LANGUAGE OverloadedStrings #-}
{-# LANGUAGE ScopedTypeVariables #-}
import Prelude hiding (head)
import Control.Applicative ((<|>), many)
import Control.Monad (void)
import Control.Monad.IO.Class (liftIO)
import Data.List (foldl', intersperse)
import Data.Text (Text)
import qualified Data.Text as T
import qualified Data.Text.Encoding as T
import Data.HashMap.Strict (HashMap)
import qualified Data.HashMap.Strict as HMS
import qualified Data.HashSet as HS
import Data.Monoid ((<>))
import Data.Foldable (asum)
import qualified System.Console.Haskeline as Haskeline
import qualified Text.PrettyPrint.ANSI.Leijen as PP
import qualified Text.Trifecta as Tri
import qualified Text.Trifecta.Delta as Tri
import qualified Text.Parser.Token as Parse
import qualified Text.Parser.Combinators as Parse
import qualified Text.Parser.Token.Highlight as Parse
import qualified Text.Parser.Char as Parse
```

As I have mentioned, we will have our variables to be well-typed, in the sense that the “depth” of the scope of terms will be tracked at the type level. This approach goes back at least to de Bruijn notation as a nested datatype by Bird and Paterson. You can refer to that paper for details, but the core idea is quite simple.

We first define the type of variables for our terms:

```
data Var a
= B -- Bound variable
| F a -- Free variable
```

This looks an awful lot like `Maybe`

, but we define our own
type for nicer naming. The role of `B`

and `F`

will hopefully
become more clear as we define expressions, but intuitively
`B`

refers to the most recently bound variable (like `0`

if
we were using normal de Bruijn indices), and `F`

refers to
a variable in the scope *without* the most recently bound
variable.

Then we define `Syntax`

and `Exp`

, in tandem. `Syntax`

specifies
the constructs of our lambda calculus: variables, applications,
lambda functions, and let bindings:

```
data Syntax a
= Var a
| Lam Text (Exp (Var a)) -- Lambda function
| Let Text
Exp a) -- Bound expression
(Exp (Var a)) -- Body of the let expression
(| App
Exp a) -- Function
(Exp a) -- Argument (
```

We will define `Exp`

shortly, but for now you can pretend it’s
`Syntax`

.

Note that the argument of `Syntax`

indicates the scope of the
term. For example if we have a term of type

`Syntax (Var (Var Text))`

we know that it’s a term with two bound variables (the two
`Var`

) and some free variables represented by the
top-level `Text`

. In such a term, we might have

```
F (F "someTopLevelDefinition")
F B -- The variable bound by the second most recent lambda or let
B -- The variable bound by the most recent lambda or let
```

Also note that we store a piece of `Text`

in `Lam`

and `Let`

to easily pretty print terms.

That said, `Exp`

is either a piece of `Syntax`

, or a *suspended* piece
of `Syntax`

:

```
data Exp a where
Syntax :: Syntax a -> Exp a
Susp :: Env from to -> Syntax from -> Exp to
-- `Susp` stands for "suspension"
```

`Env b a`

is some data structure containing information to turn a
term with scope `b`

into a term in scope `a`

. For example, something
of type

`Env (Var (Var Text)) (Var Text)`

contains information on how to remove one free variable out of
a term. We will define `Env`

shortly, but first let’s define a
couple of shortcuts to form `Exp`

s quickly:

```
var :: a -> Exp a
= Syntax (Var v)
var v
lam :: Text -> Exp (Var a) -> Exp a
= Syntax (Lam n body)
lam n body
let_ :: Text -> Exp a -> Exp (Var a) -> Exp a
= Syntax (Let n e1 e2) let_ n e1 e2
```

We can now get to the tricky part: defining environments that
let us delay substitution. We first define a GADT to specify
an *increase* in scope depth:

```
data Weaken from to where
WeakenZero :: Weaken a a
WeakenSucc :: Weaken from to -> Weaken from (Var to)
```

If we have `Weaken from to`

, `to`

it’s going to be of the
form `Var (Var ... (Var from))`

: it specifies an increase
of scope depth from `from`

.

Then, a *canonical* environment is either just a weakening,
or an existing environment added with an expression containing
the value for a bound varible:

```
data CanonicalEnv from to where
EnvNil :: Weaken from to -> CanonicalEnv from to
EnvCons :: Text -> Exp to -> Env from to -> CanonicalEnv (Var from) to
```

Similarly to `Lam`

and `Let`

, we store the name of the variable
that `EnvCons`

is referring to for easy pretty printing.

We call this form of environments canonical because we will reduce all environments to this form. However, we can also form environments by composition:

```
data Env from to where
EnvCanonical :: CanonicalEnv from to -> Env from to
EnvComp :: Env a b -> Env b c -> Env a c
```

To recap:

`EnvNil wk`

weakens terms by the amount specified by
`wk`

. For example, applying

`EnvCanonical (EnvNil (WeakenSucc WeakenZero)) :: Env a (Var a)`

to a term of type `Exp a`

will result in a term of type `Exp (Var a)`

,
which will be implemented by applying all variables in the term to `F`

.

`EnvCons n e env`

will replace the first bound variable with
`e`

, and then apply the environment `env`

. For example, applying

`EnvCanonical (EnvCons n e (EnvCanonical (EnvNil WeakeZero))) :: Env (Var a) a`

to a term of type `Exp (Var a)`

will result in a term of type
`Exp a`

, where the first bound variable is replaced with `e`

.

`EnvComp env1 env2`

will apply first environment `env1`

and then
environment `env2`

.

Let’s define some shortcuts to construct environments and suspensions:

```
-- Takes an expression and forms the appropriate
-- suspension applying the given environment.
susp :: Env b a -> Exp b -> Exp a
= \case
susp env Syntax e -> Susp env e
-- If the expression is already a suspension,
-- compose the environments.
Susp env' e -> Susp (EnvComp env' env) e
envNil :: Env a a
= EnvCanonical (EnvNil WeakenZero)
envNil
envCons :: Text -> Exp to -> Env from to -> Env (Var from) to
= EnvCanonical (EnvCons v e env)
envCons v e env
envComp :: Env a b -> Env b c -> Env a c
= EnvComp
envComp
envWeaken :: Env a b -> Weaken b c -> Env a c
= envComp env (EnvCanonical (EnvNil wk))
envWeaken env wk
-- Useful to produce environments that work under
-- abstractions (lambda and let) given an existing
-- environment working outside the abstraction.
envAbs :: Text -> Env from to -> Env (Var from) (Var to)
= envCons v (var B) (envWeaken env (WeakenSucc WeakenZero)) envAbs v env
```

Then, we can define a function to remove delayed composition of environments. Although our environments differ quite significantly from the ones in the original lambda-Prolog paper, this is the trickiest part where the well-typed scope are a really big help.

```
evalEnv :: Env from to -> CanonicalEnv from to
= \case
evalEnv -- If the environment is already canonical, stop
EnvCanonical env -> env
-- If we have a composition, evaluate the left
-- hand side and then compose...
EnvComp env1 env2 -> goComp (evalEnv env1) env2
where
-- Compose a canonical environment with normal environment
goComp :: CanonicalEnv a b -> Env b c -> CanonicalEnv a c
-- If the LHS is just a weakening, push the weakening
-- through.
EnvNil wk) env2 = goCompWeaken wk env2
goComp (-- If the LHS is a delayed substitution, return it
-- applying the RHS to the expression and composing
-- the rest of the environment.
EnvCons n e env1) env2 = EnvCons n (susp env2 e) (EnvComp env1 env2)
goComp (
-- Composes a weakening and an environment.
goCompWeaken :: Weaken a b -> Env b c -> CanonicalEnv a c
= \case
goCompWeaken wk -- If the RHS is a weakening, just compose the two
-- weakenings
EnvCanonical (EnvNil wk') -> EnvNil (compWeaken wk wk')
-- If the RHS is a delayed substitution, drop it
-- if the weakening is non-zero, return the RHS
-- as-is otherwise.
EnvCanonical (EnvCons v e env) -> case wk of
WeakenZero -> EnvCons v e env
WeakenSucc wk' -> goCompWeaken wk' env
-- If the RHS is a composition, apply the weakening to the
-- LHS of the composition and then compose again.
EnvComp env1 env2 -> goComp (goCompWeaken wk env1) env2
-- Compose two weakenings -- same as addition
compWeaken :: Weaken a b -> Weaken b c -> Weaken a c
WeakenZero = wk1
compWeaken wk1 WeakenSucc wk2) = WeakenSucc (compWeaken wk1 wk2) compWeaken wk1 (
```

The only surprising rule is the one dropping the substitution when a weakening is composed with an environment – the intuition is that if we’ve just weakened a term it surely can’t refer to the first bound variable.

Note that while these rules feel quite natural (and in fact are pretty much forced by the types), they are natural because of how we formulated environments, and that formulation was also guided by the types. When pushing more property of the code in the types, this often happens: data structures are largely driven by making your programs type check more easily. As Conor McBride put it, types are lamps, not lifebuoys.

Once we have this function “evaluating” environments, we can write a function taking a variable and looking up into an environment:

```
envLookup :: Env from to -> from -> Exp to
= case evalEnv env0 of
envLookup env0 v -- If the environment is a weakening, just
-- weaken the variable by the required amount.
EnvNil wk -> var (weakenVar wk v)
-- If the environment is a cons, get the
-- bound expression if the variable is the
-- first bound variable, recurse otherwise.
EnvCons _b e env -> case v of
B -> e
F v' -> envLookup env v'
weakenVar :: Weaken from to -> from -> to
= case wk0 of
weakenVar wk0 v WeakenZero -> v
WeakenSucc wk -> F (weakenVar wk v)
```

Finally, we can evaluate expressions to their head normal form (if they have one).

Normalized terms are either a lambda or a free variable applied to some terms (a neutral term):

```
data Eval a
= EvalLam Text (Exp (Var a))
| EvalNeutral a [Exp a]
```

Then we define a function to push environments
substitution down the expression, giving us back
a `Syntax`

:

```
removeSusp :: Exp a -> Syntax a
= \case
removeSusp Syntax e -> e
Susp env e0 -> case e0 of
-- Look up variables
Var v -> removeSusp (envLookup env v)
-- Push environments past lambdas...
Lam v body -> Lam v (susp (envAbs v env) body)
-- ..and lets.
Let n e1 e2 -> Let n (susp env e1) (susp (envAbs n env) e2)
-- Apply environments to both function and
-- argument.
App fun arg -> App (susp env fun) (susp env arg)
```

Then, evaluating a term is just a matter of creating
the right suspension and using `removeSusp`

:

```
eval :: Syntax a -> Eval a
= \case
eval -- If the term is a variable, return a neutral term
Var v -> EvalNeutral v []
-- If we have a lambda we're done
Lam v body -> EvalLam v body
-- If the term is an application, evaluate the function...
App fun0 arg -> case eval (removeSusp fun0) of
-- ...and add the argument if the function is neutral...
EvalNeutral v args -> EvalNeutral v (args ++ [arg])
-- ...or apply an environment containing the argument
-- if it's a lambda.
EvalLam v body -> eval (removeSusp (susp (envCons v arg envNil) body))
-- If we have a let, substitute the bound expression
-- in the body of the let.
Let n e1 e2 -> eval (removeSusp (susp (envCons n e1 envNil) e2))
```

And we’re done! In the rest of the article I implement a parser and pretty printer, which means that you can do

```
$ stack --resolver lts-8.11 ghci
Prelude> :l suspension.lhs
Main> repl
>>> \x -> x
Evaluated expression:
\x -> x
Evaluated expression (no suspensions):
\x -> x
>>> (\x -> x) foo
Evaluated expression:
foo
Evaluated expression (no suspensions):
foo
>>> let x = foo; x
Evaluated expression:
foo
Evaluated expression (no suspensions):
foo
```

Things get interesting when we evaluate expressions that contain delayed substitutions:

```
>>> (\a b -> a) foo
Evaluated expression:
\b ->
$susp
($cons
(b_1 := b)
($comp ($cons (a := foo) ($nil 0)) ($nil 1)))
a
Evaluated expression (no suspensions):
\b -> foo
>>> :{
| let x = \y -> x y;
| x foo
| }:
Evaluated expression:
x
($susp
($cons
(y :=
$susp ($cons (x := \y -> x y) ($nil 0)) foo)
($nil 0))
y)
Evaluated expression (no suspensions):
x foo
```

The first printed expression shows the full suspension
including the environment, where `$susp env a`

represents
a `Susp`

, `$cons (n := e) env`

an `EnvCons n e env`

, and
`$nil i`

a `EnvNil wk`

where `wk`

weakens by `i`

.

We also print the expression with all the suspensions removed.

Node that this approach can be paired with other performance improvements, such as graph reduction (sharing common subexpressions and evaluating them all at once), or more eager evaluation of function arguments.

Thanks for listening, comments on reddit.

```
evalToSyntax :: Eval a -> Syntax a
= \case
evalToSyntax EvalLam n body -> Lam n body
EvalNeutral v args -> foldl' (\e -> App (Syntax e)) (Var v) args
removeAllSusps :: Exp a -> Exp a
= Syntax $ case removeSusp e of
removeAllSusps e Var v -> Var v
Lam n body -> Lam n (removeAllSusps body)
Let n e1 e2 -> Let n (removeAllSusps e1) (removeAllSusps e2)
App fun arg -> App (removeAllSusps fun) (removeAllSusps arg)
data PrettyEnv a = PrettyEnv
peCounters :: HashMap Text Int
{ pePrettyNames :: PrettyNames a
,
}data PrettyNames a where
PrettyNamesNil :: PrettyNames Text
PrettyNamesCons :: Text -> PrettyNames a -> PrettyNames (Var a)
newPrettyEnv :: PrettyEnv Text
= PrettyEnv mempty PrettyNamesNil
newPrettyEnv
weakenPrettyEnv :: PrettyEnv a -> Text -> (Text, PrettyEnv (Var a))
= let
weakenPrettyEnv vn n = case HMS.lookup n (peCounters vn) of
counter Nothing -> 0
Just c -> c
= HMS.insert n (counter+1) (peCounters vn)
counters = if counter == 0 then n else n <> "_" <> T.pack (show counter)
n' in
( n'
, vn= counters
{ peCounters = PrettyNamesCons n' (pePrettyNames vn)
, pePrettyNames
}
)
strengthenPrettyEnv :: PrettyEnv (Var a) -> PrettyEnv a
= vn
strengthenPrettyEnv vn = case pePrettyNames vn of
{ pePrettyNames PrettyNamesCons _ ns -> ns
}
peLookup :: PrettyEnv a -> a -> Text
= go (pePrettyNames vn)
peLookup vn where
go :: PrettyNames a -> a -> Text
= case ns0 of
go ns0 v PrettyNamesNil -> v
PrettyNamesCons txt ns -> case v of
B -> txt
F v' -> go ns v'
data Position
= PosNormal
| PosArg
posParens :: Position -> PP.Doc -> PP.Doc
= \case
posParens PosNormal -> id
PosArg -> PP.parens
hang :: PP.Doc -> PP.Doc
= PP.group . PP.nest 2
hang
prettyExp :: Position -> PrettyEnv a -> Exp a -> PP.Doc
= \case
prettyExp pos vn Syntax e -> prettySyntax pos vn e
Susp env e -> prettySusp pos vn env (Syntax e)
prettySyntax :: Position -> PrettyEnv a -> Syntax a -> PP.Doc
= \case
prettySyntax pos vn Var v -> PP.text (T.unpack (peLookup vn v))
@App{} -> posParens pos (hang (prettyApp (Syntax e)))
e@Lam{} -> posParens pos (hang ("\\" PP.<> prettyLam vn (Syntax e)))
eLet n e1 e2 -> posParens pos $ let
= weakenPrettyEnv vn n
(n', vn') in
PP.<+> "=" PP.<+>
PP.text (T.unpack n') PosNormal vn e1 PP.<> ";" PP.<$>
prettyExp PosNormal vn' e2
prettyExp where
= \case
prettyApp Syntax (App fun arg) -> prettyApp fun PP.<$> prettyExp PosArg vn arg
-> prettyExp PosArg vn e
e
prettyLam :: PrettyEnv a -> Exp a -> PP.Doc
= \case
prettyLam vn' Syntax (Lam n body) -> let
= weakenPrettyEnv vn' n
(n', vn'') in PP.text (T.unpack n') PP.<+> prettyLam vn'' body
-> "->" PP.<$> prettyExp PosNormal vn' e
e
prettySusp :: Position -> PrettyEnv b -> Env a b -> Exp a -> PP.Doc
= let
prettySusp pos vn env e = prettyEnv PosArg vn env
(envDoc, vn') in posParens pos (hang (PP.vsep ["$susp", envDoc, prettyExp PosArg vn' e]))
prettyEnv :: Position -> PrettyEnv b -> Env a b -> (PP.Doc, PrettyEnv a)
= \case
prettyEnv pos vn EnvComp env1 env2 -> let
= prettyEnv PosArg vn env2
(env2Doc, vn') = prettyEnv PosArg vn' env1
(env1Doc, vn'') in (posParens pos (hang (PP.vsep ["$comp", env1Doc, env2Doc])), vn'')
EnvCanonical (EnvNil wk) -> let
= prettyWeaken vn wk
(wkDoc, vn') in (posParens pos ("$nil" PP.<+> wkDoc), vn')
EnvCanonical (EnvCons n0 e env') -> let
= prettyEnv PosArg vn env'
(env'Doc, vn') = weakenPrettyEnv vn' n0
(n, vn'') in
$ hang $ PP.vsep
( posParens pos "$cons"
[ PP.<+> ":=" PP.<$> prettyExp PosNormal vn e))
, PP.parens (hang (PP.text (T.unpack n)
, env'Doc
]
, vn''
)
prettyWeaken :: PrettyEnv b -> Weaken a b -> (PP.Doc, PrettyEnv a)
= let
prettyWeaken vn0 wk0 = go vn0 wk0
(wkNum, vn) in (PP.integer wkNum, vn)
where
go :: PrettyEnv b -> Weaken a b -> (Integer, PrettyEnv a)
= \case
go vn WeakenZero -> (0, vn)
WeakenSucc wk -> let
= go (strengthenPrettyEnv vn) wk
(c, vn') in (c+1, vn')
```

```
type ParseMonad = Tri.Parser
data ParseEnv a where
ParseEnvNil :: ParseEnv Text
ParseEnvCons :: Text -> ParseEnv a -> ParseEnv (Var a)
parseEnvLookup :: ParseEnv a -> Text -> a
= case env0 of
parseEnvLookup env0 txt ParseEnvNil -> txt
ParseEnvCons txt' env -> if txt == txt'
then B
else F (parseEnvLookup env txt)
parseExp :: Position -> ParseEnv a -> ParseMonad (Exp a)
= Syntax <$> parseSyntax pos env
parseExp pos env
parseSyntax :: Position -> ParseEnv a -> ParseMonad (Syntax a)
= (case pos of
parseSyntax pos env PosNormal -> asum
[ parseLam env
, parseLet envdo
, head <- parseSyntax PosArg env
<- many (parseSyntax PosArg env)
args return (foldl' (\fun arg -> App (Syntax fun) (Syntax arg)) head args)
]PosArg -> asum
Var <$> parseVar env
[ PosNormal env)
, Parse.parens (parseSyntax Parse.<?> "expression"
])
parseVar :: ParseEnv a -> ParseMonad a
= do
parseVar env <- Parse.ident parseIdentStyle
n return (parseEnvLookup env n)
parseIdentStyle :: Parse.IdentifierStyle ParseMonad
= Parse.IdentifierStyle
parseIdentStyle = "identifier"
{ Parse._styleName = Parse.letter <|> Parse.char '_'
, Parse._styleStart = Parse.alphaNum <|> Parse.char '_'
, Parse._styleLetter = HS.fromList ["let"]
, Parse._styleReserved = Parse.Identifier
, Parse._styleHighlight = Parse.ReservedIdentifier
, Parse._styleReservedHighlight
}
parseLam :: ParseEnv a -> ParseMonad (Syntax a)
= (do
parseLam env0 '\\')
void (Parse.symbolic <- Parse.ident parseIdentStyle
n Lam n <$> go (ParseEnvCons n env0)) Parse.<?> "lambda"
where
go :: ParseEnv a -> ParseMonad (Exp a)
= asum
go env do
[ "->")
void (Parse.symbol PosNormal env
parseExp do
, <- Parse.ident parseIdentStyle
n <$> go (ParseEnvCons n env)
lam n
]
parseLet :: ParseEnv a -> ParseMonad (Syntax a)
= (do
parseLet env "let")
void (Parse.reserve parseIdentStyle <- Parse.ident parseIdentStyle
n '=')
void (Parse.symbolic <- parseExp PosNormal env
e1 ';')
void (Parse.symbolic <- parseExp PosNormal (ParseEnvCons n env)
e2 return (Let n e1 e2)) Parse.<?> "let"
```

```
repl :: IO ()
= Haskeline.runInputT
repl
Haskeline.defaultSettings= Just ".lambda" }
{ Haskeline.historyFile
loopwhere
= PP.displayS (PP.renderSmart 0.6 80 x) ""
render x = Haskeline.outputStrLn . render
outputDoc
= parseExp PosNormal ParseEnvNil <* Tri.eof
parseInput
line :: Int) (col :: Int) s p = let
runParser fp (= Tri.Directed (T.encodeUtf8 (T.pack fp)) (fromIntegral line - 1) (fromIntegral col - 1) 0 0
delta in case Tri.parseByteString p delta s of
Tri.Success a -> Right a
Tri.Failure err -> Left (Tri._errDoc err)
loop :: Haskeline.InputT IO ()
= do
loop <- Haskeline.getInputLine ">>> "
mbInput let processAndLoop s = do
let mbX = runParser "repl" 0 0 (T.encodeUtf8 (T.pack s)) parseInput
case mbX of
Left err -> do
"Error while parsing" PP.<$> err)
outputDoc (
loopRight x -> do
"Parsed expression:" PP.<$> PP.indent 2 (prettyExp PosNormal newPrettyEnv x))
outputDoc (let whnf = Syntax (evalToSyntax (eval (removeSusp x)))
$
outputDoc "Evaluated expression:" PP.<$>
2 (prettyExp PosNormal newPrettyEnv whnf)
PP.indent $
outputDoc "Evaluated expression (no suspensions):" PP.<$>
2 (prettyExp PosNormal newPrettyEnv (removeAllSusps whnf))
PP.indent
loopcase mbInput of
Nothing -> return ()
Just (':' : cmd) -> case cmd of
"q" -> return ()
"{" -> do
let collect :: [String] -> Haskeline.InputT IO ()
= do
collect chunks <- Haskeline.getInputLine " | "
mbInput' case mbInput' of
Nothing -> return ()
Just "}:" -> processAndLoop (concat (intersperse "\n" (reverse chunks)))
Just chunk -> collect (chunk : chunks)
collect []'l' : ' ' : file -> processAndLoop =<< liftIO (readFile file)
-> do
_ "Unrecognized command" PP.<+> PP.text cmd)
outputDoc (
loopJust input -> processAndLoop input
```

Or “with open terms” or “under binders”, depending to who you are talking to.↩︎

For more about the suspension calculus as described by the authors of lambda-Prolog, see A Simplified Suspension Calculus and its Relationship to Other Explicit Substitution Calculi, by Andrew Gacek and Gopalan Nadathur.↩︎