Kappa Calculus

In mathematical logic, category theory, and
computer science, kappa calculus is a
formal system for defining first-order
functions.

Unlike lambda calculus, kappa calculus has no
higher-order functions; its functions are
not first class objects. Kappa-calculus can be
regarded as "a reformulation of the first-order fragment of typed
lambda calculus".

Because its functions are not first-class objects, evaluation of kappa
calculus expressions does not require
closures.

Definition

''The definition below has been adapted from the diagrams on pages 205 and 207 of Hasegawa.''

Grammar

Kappa calculus consists of ''types'' and ''expressions,'' given by the
grammar below:

:$\tau = 1 \mid \tau\times\tau \mid \ldots$

:$e = x \mid id_\tau \mid !_\tau \mid \operatorname_\tau(e) \mid e \circ e \mid \kappa x:1\tau . e$

In other words,

* 1 is a type
* If $\tau_1$ and $\tau_2$ are types then $\tau_1\times\tau_2$ is a type.
* Every variable is an expression
* If is a type then $id_\tau$ is an expression
* If is a type then $!_\tau$ is an expression
* If is a type and e is an expression then $\operatorname_\tau(e)$ is an expression
* If $e_1$ and $e_2$ are expressions then $e_1\circ e_2$ is an expression
* If x is a variable, is a type, and e is an expression, then $\kappa x1\tau\;.\;e$ is an expression

The $:1\tau$ and the subscripts of , , and $\operatorname$ are
sometimes omitted when they can be unambiguously determined from the
context.

Juxtaposition is often used as an abbreviation for a combination of
$\operatorname$ and composition:

:$e_1 e_2\ \overset\operatorname\ e_1 \circ \operatorname(e_2)$

Typing rules

''The presentation here uses sequents ($\Gamma\vdash e:\tau$) rather than hypothetical judgments in order to ease comparison with the simply typed lambda calculus. This requires the additional Var rule, which does not appear in Hasegawa''

In kappa calculus an expression has two types: the type of its ''source'' and the type of its ''target''. The notation $e:\tau_1\tau_2$ is used to indicate that expression e has source type $$ and target type $$.

Expressions in kappa calculus are assigned types according to the following rules:

:

In other words,

* Var: assuming $x:1\tau$ lets you conclude that $x:1\tau$
* Id: for any type , $id_\tau:\tau\tau$
* Bang: for any type , $!_\tau:\tau1$
* Comp: if the target type of $e_1$ matches the source type of $e_2$ they may be composed to form an expression $e_2\circ e_1$ with the source type of $e_1$ and target type of $e_2$
* Lift: if $e:1\tau_1$, then $\operatorname_(e):\tau_2(\tau_1\times\tau_2)$
* Kappa: if we can conclude that $e:\tau_2\to\tau_3$ under the assumption that $x:1\tau_1$, then we may conclude ''without that assumption'' that $\kappa x1\tau_1\,.\,e\;:\;\tau_1\times\tau_2\to\tau_3$

Equalities

Kappa calculus obeys the following equalities:

* Neutrality: If $f:\tau_1\tau_2$ then $fid_=f$ and $f=id_f$
* Associativity: If $f:\tau_1\tau_2$, $g:\tau_2\tau_3$, and $h:\tau_3\tau_4$, then $(hg)f = h(gf)$.
* Terminality: If $f\tau1$ and $g\tau1$ then $f=g$
* Lift-Reduction: (\kappa x.f)\circ \operatorname_\tau(c) = f /x/math>
* Kappa-Reduction: $\kappa x. (h\circ \operatorname_\tau(x)) = h$ if x is not free in h

The last two equalities are reduction rules for the calculus,
rewriting from left to right.

Properties

The type can be regarded as the unit type. Because of this, any two functions whose argument type is the same and whose result type is should be equal – since there is only a single value of type both functions must return that value for every argument (Terminality).

Expressions with type $1\tau$ can be regarded as "constants" or values of "ground type"; this is because is the unit type, and so a function from this type is necessarily a constant function. Note that the kappa rule allows abstractions only when the variable being abstracted has the type $1\tau$ for some . This is the basic mechanism which ensures that all functions are first-order.

Categorical semantics

Kappa calculus is intended to be the internal language of
''contextually complete'' categories.

Examples

Expressions with multiple arguments have source types which are
"right-imbalanced" binary trees. For example, a function f with three
arguments of types A, B, and C and result type D will have type

: $f : A\times (B\times (C\times 1)) \to D$

If we define left-associative juxtaposition $f\;c$ as an abbreviation
for $(f\circ \operatorname(c))$, then – assuming that
$a:1A$, $b:1B$, and
$c:1C$ – we can apply this function:

: $f\;a\;b\;c\;:\;1 \to D$

Since the expression $f\;a\;b\;c$ has source type , it is a "ground value" and may be passed as an argument to another function. If $g:(D\times E)F$, then

: $g\;(f\;a\;b\;c)\;:\;E \to F$

Much like a curried function of type
$A(B(CD))$ in lambda calculus, partial
application is possible:

: $f\;a\;:\;B\times (C\times 1) \to D$

However no higher types (i.e. $(\tau\tau)\tau$) are involved. Note that because the source type of is not , the following expression cannot be well-typed under the assumptions mentioned so far:

: $h\;(f\;a)$

Because successive application is used for multiple
arguments it is not necessary to know the arity of a function in
order to determine its typing; for example, if we know that
$c:1C$ then the expression

:

is well-typed as long as has type
: $(C\times\alpha)\beta$ for some
and . This property is important when calculating
the principal type of an expression, something
which can be difficult when attempting to exclude higher-order
functions from typed lambda calculi by restricting the grammar of types.

History

Barendregt originally introduced the term
"functional completeness" in the context of combinatory algebra.
Kappa calculus arose out of efforts by Lambek to formulate an appropriate analogue of functional
completeness for arbitrary categories (see Hermida and Jacobs, section 1). Hasegawa later developed kappa
calculus into a usable (though simple) programming language including
arithmetic over natural numbers and primitive recursion. Connections to arrows
were later investigated by Power, Thielecke, and others.

Variants

It is possible to explore versions of kappa calculus with
substructural types such as linear, affine,
and ordered types. These extensions require eliminating or
restricting the $!_\tau$ expression. In such circumstances
the type operator is not a true cartesian product,
and is generally written to make this clear.

References

*

*

{{cite book
, author1-last = Power
, author1-first = John
, author2-last = Thielecke
, author2-first = Hayo
, year = 1999
, editor1-last = Wiedermann
, editor1-first = Jiří
, editor2-last = van Emde Boas
, editor2-first = Peter
, editor2-link = Peter van Emde Boas
, editor3-last = Nielsen
, editor3-first = Mogens
, title = Closed Freyd- and {{mvar, κ-Categories
, journal = Automata, Languages and Programming: 26th International Colloquium, ICALP'99 Prague, Czech Republic, July 11–15, 1999 Proceedings
, series = Lecture Notes in Computer Science
, publisher = Springer-Verlag Berlin Heidelberg
, volume = 1644
, pages = 625–634
, doi = 10.1007/3-540-48523-6_59
, isbn = 978-3-540-66224-2
, issn = 0302-9743, citeseerx = 10.1.1.42.2151

Logical calculi