nLab dependent type theory

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Contents

Context

Type theory

natural deduction metalanguage, practical foundations

  1. type formation rule
  2. term introduction rule
  3. term elimination rule
  4. computation rule

type theory (dependent, intensional, observational type theory, homotopy type theory)

syntax object language

computational trinitarianism =
propositions as types +programs as proofs +relation type theory/category theory

logicset theory (internal logic of)category theorytype theory
propositionsetobjecttype
predicatefamily of setsdisplay morphismdependent type
proofelementgeneralized elementterm/program
cut rulecomposition of classifying morphisms / pullback of display mapssubstitution
introduction rule for implicationcounit for hom-tensor adjunctionlambda
elimination rule for implicationunit for hom-tensor adjunctionapplication
cut elimination for implicationone of the zigzag identities for hom-tensor adjunctionbeta reduction
identity elimination for implicationthe other zigzag identity for hom-tensor adjunctioneta conversion
truesingletonterminal object/(-2)-truncated objecth-level 0-type/unit type
falseempty setinitial objectempty type
proposition, truth valuesubsingletonsubterminal object/(-1)-truncated objecth-proposition, mere proposition
logical conjunctioncartesian productproductproduct type
disjunctiondisjoint union (support of)coproduct ((-1)-truncation of)sum type (bracket type of)
implicationfunction set (into subsingleton)internal hom (into subterminal object)function type (into h-proposition)
negationfunction set into empty setinternal hom into initial objectfunction type into empty type
universal quantificationindexed cartesian product (of family of subsingletons)dependent product (of family of subterminal objects)dependent product type (of family of h-propositions)
existential quantificationindexed disjoint union (support of)dependent sum ((-1)-truncation of)dependent sum type (bracket type of)
logical equivalencebijection setobject of isomorphismsequivalence type
support setsupport object/(-1)-truncationpropositional truncation/bracket type
n-image of morphism into terminal object/n-truncationn-truncation modality
equalitydiagonal function/diagonal subset/diagonal relationpath space objectidentity type/path type
completely presented setsetdiscrete object/0-truncated objecth-level 2-type/set/h-set
setset with equivalence relationinternal 0-groupoidBishop set/setoid with its pseudo-equivalence relation an actual equivalence relation
equivalence class/quotient setquotientquotient type
inductioncolimitinductive type, W-type, M-type
higher inductionhigher colimithigher inductive type
-0-truncated higher colimitquotient inductive type
coinductionlimitcoinductive type
presettype without identity types
set of truth valuessubobject classifiertype of propositions
domain of discourseuniverseobject classifiertype universe
modalityclosure operator, (idempotent) monadmodal type theory, monad (in computer science)
linear logic(symmetric, closed) monoidal categorylinear type theory/quantum computation
proof netstring diagramquantum circuit
(absence of) contraction rule(absence of) diagonalno-cloning theorem
synthetic mathematicsdomain specific embedded programming language

homotopy levels

semantics

Contents

Idea

Dependent type theory is the flavor of type theory that admits dependent types.

Its categorical semantics is in locally cartesian closed categories CC, where a dependent type

x:XE(x)type x : X \vdash E(x) \; \mathrm{type}

is interpreted as a morphism EXE \to X, hence an object in the slice category C /XC_{/X}.

Then change of context corresponds to base change in CC. See also dependent sum and dependent product.

Dependent type systems are heavily used for software certification.

In the foundations of mathematics

Dependent type theory itself support various foundations of mathematics via the propositions as some types interpretation of dependent type theory, where propositions are the types where every two elements are equal

isProp(A) x:A y:Ax= Ay\mathrm{isProp}(A) \coloneqq \prod_{x:A} \prod_{y:A} x =_A y

Suppose that a dependent type theory has a separate type judgment as well as dependent product types, dependent sum types, identity types, weak function extensionality, propositional truncations, empty type, unit type, sum types. All the operations in predicate logic are derivable from said type formers:

Then

Description

Judgments for types and terms

type theorycategory theory
syntaxsemantics
judgmentdiagram
typeobject in category
Atype\vdash\; A \; \mathrm{type}A𝒞A \in \mathcal{C}
termelement
a:A\vdash\; a \colon A*aA* \stackrel{a}{\to} A
dependent typeobject in slice category
x:XA(x)typex \colon X \;\vdash\; A(x) \; \mathrm{type}A X𝒞 /X\array{A \\ \downarrow \\ X} \in \mathcal{C}_{/X}
term in contextgeneralized elements/element in slice category
x:Xa(x):A(x)x \colon X \;\vdash \; a(x)\colon A(x)X a A id X X\array{X &&\stackrel{a}{\to}&& A \\ & {}_{\mathllap{id_X}}\searrow && \swarrow_{\mathrlap{}} \\ && X}
x:Xa(x):Ax \colon X \;\vdash \; a(x)\colon AX (id X,a) X×A id X p 1 X\array{X &&\stackrel{(id_X,a)}{\to}&& X \times A \\ & {}_{\mathllap{id_X}}\searrow && \swarrow_{\mathrlap{p_1}} \\ && X}

Properties

Theorem

The functors

constitute an equivalence of categories

DependentTypeTheoriesContLangLocallyCartesianClosedCategories. DependentTypeTheories \stackrel{\overset{Lang}{\leftarrow}}{\underset{Cont}{\to}} LocallyCartesianClosedCategories \,.

This (Seely, theorem 6.3). It is somewhat more complicated than this, because we need to strictify the category theory to match the category theory; see categorical model of dependent types. For a more detailed discussion see at relation between type theory and category theory.

Extensional vs Intensional

There is an important distinction between extensional type theories and intensional ones. The meanings of these words is probably clearest when dealing with function types, such as an exponential Y XY^X, but also arises in respect to quotient types and identity types.

Extensional and intensional function types

A function type Y XY^X is said to be extensional if whenever f,g:XYf,g\colon X\to Y are functions such that f(x)=g(x)f(x)=g(x) for all xXx\in X, then in fact f=gf=g as elements of Y XY^X. This clearly corresponds to the modeling of function types by function sets in the set-theoretic semantics, or more generally by exponential objects in the categorical semantics discussed above. The uniqueness clause of the defining assertion of an exponential object, i.e. that any map Z×XYZ\times X\to Y factors through a unique map ZY XZ\to Y^X, precisely models this “extensionality” property. Thus, the standard categorical semantics is most closely allied to type theories which have such an “extensionality” axiom.

By contrast, suppose that XX and YY are interpreted by data types in some programming language, and Y XY^X is interpreted by some type of computable functions from Y XY^X. Of course, many differently coded functions can have the same “extensional behavior,” i.e. the same output for any given input, but we may still want to distinguish between these functions because they may not share other properties (such as running time or complexity). Thus, this type Y XY^X is not extensional—equality of functions, as elements of Y XY^X, is “implementation-sensitive,” a finer measure than mere equality on all inputs. We say instead that these function types are intensional.

In type theory, extensional function-types generally come with both a “β\beta-rule,” which specifies the computational behavior of a λ\lambda-abstraction (i.e. (λx.t)(y)=t[y/x](\lambda x. t)(y) = t[y/x]), and an “η\eta-rule,” which specifies that a λ\lambda-abstraction is determined by its behavior (i.e. f=(λx.f(x))f = (\lambda x. f(x))). In the categorical semantics, the first specifies the existence of factorizations, while the second requires them to be unique. In intensional type theory, we generally keep the β\beta-rule (it is certainly natural from a computational standpoint) but discard the η\eta-rule. Thus, one natural sort of semantics for intensional type theory is valued in a category with “weak exponentials,” i.e. objects which satisfy the existence but not uniqueness property of an exponential (and similarly for dependent type theory with Π\Pi-types and weak dependent products).

Quotient types and exact completion

Intensional type theory is also popular among adherents of constructive mathematics and especially predicative mathematics, because of its computational content. Per Martin-Löf‘s original dependent type theory is often presented from this perspective.

When viewing intensional type theory as a foundation for mathematics (rather than, say, a syntax for reasoning about computer programs), it is natural to view the types as representing presets, rather than sets. This is in line with the classical constructivist viewpoint that “a set is defined by a collection of things together with an equality relation.” Note that in intensional type theory, the “equality” between terms is free to be the “syntactic” equality, which is entirely computable and preserved by everything in sight. In particular, if we adopt the viewpoint of propositions as types, then “the axiom of choice is trivially valid” for functions between types (i.e. presets) since to assert that something exists is to give an element of a sum type, which is exactly to give a witness and thereby a way to choose such a thing.

If we then define “sets” to be types equipped with equality relations (sometimes called setoids), then the sets will have more familiar properties, such as existence of extensional exponentials (obtained by equipping the intensional exponentials with an extensional equality relation), as well as the existence of quotient sets. (The existence of quotient types is often assumed in extensional type theory, but not in intensional type theory.) In categorical terms, the syntactic category of an intensional type theory has only weak exponentials (resp. dependent products), but that is sufficient to ensure that its free exact completion has actual exponentials (resp. dependent products). Note also that free exact completions always also validate COSHEP, since every object of the starting category (here the category of types) is projective. This matches the above observations about the axiom of choice.

Identity types

(to be written…)

Relation between identity types and path space objects in a category with weak equivalences.

Higher-categorical semantics

(to be written…)

Examples

References

For original references see at Martin-Löf dependent type theory, such as:

also published as:

Gentle exposition of the basic principles:

Introductory accounts:

Introduction with parallel details on using proof assistants:

for Coq:

for Agda:

Original discussion of dependent type theory as the internal language of locally cartesian closed categories is in

  • R. A. G. Seely, Locally cartesian closed categories and type theory, Math. Proc. Camb. Phil. Soc. (1984) 95 (pdf)

A formal definition of dependent type theories beyond Martin-Löf dependent type theory:

On (essentially algebraic) formulations of dependent type theory (see here at categorical models of dependent type theory):

An algebraic treatment of dependent type theory, analogous to algebraic set theory, is in

For more see the references at Martin-Löf dependent type theory.

Last revised on May 20, 2025 at 09:21:34. See the history of this page for a list of all contributions to it.