Computational Paths and the Calculation of Fundamental Groups

What is a Proof of an Equality? The Functional Interpretation of Propositional Equality Normal form for equality proofs
Computational Paths and
the Calculation of Fundamental Groups
Ruy de Queiroz
(joint work with Anjolina de Oliveira)
Centro de Informática
Universidade Federal de Pernambuco (UFPE)
Recife, Brazil
Lógicos em Quarentena - Soc. Bras. de Lógica (SBL)
20 Maio 2020
Ruy de Queiroz (joint work with Anjolina de Oliveira)
Centro de Informática Universidade Federal de Pernambuco (UFPE) Recife, Brazil
Computational Paths and the Calculation of Fundamental Groups

Impact of Intuitionistic Type Theory
2020 Rolf Schock prize in logic and philosophy

Impact of Intuitionistic Type Theory in Mathematics
Proofs of equality
By introducing (in 1973) a framework in which a formalisation of
the logical notion of equality, via the so-called “identity type”,
Martin-L¨of’s Type Theory allows for a surprising connection
between term rewriting and geometric concepts such as path
and homotopy.
The impact in mathematics has been felt more strongly since
the start of Vladimir Voevodsky’s program on the univalent
foundations of mathematics around 2005, joined by Steve
Awodey in building an approach referred to in 2007 as
homotopy type theory.

Vladimir Voevodsky on ‘isomorphism invariance principle’
“One of the keystones of contemporary mathematics is the
isomorphism invariance principle: for any statement P about X
and any isomorphism X
φ
X , there is a statement Pφ about X such
that P holds iff Pφ holds
The equality problem in formalizations comes in part from the fact
that when one encodes X and X the isomorphism is lost.
There is more to the equality problem than isomorphism invariance:
• equality is a good notion for ‘elements’ – individuals, but fails for
collections.
• isomorphism is a good notion for collections, but fails for collections
of collections.
This leads to a theory of iterated n-equivalences which are the
correct replacements for such “iterated collection” ”
Foundations of Mathematics and Homotopy Theory, IAS (2006)

Working with ‘sameness’
From Michael Shulman’s Homotopy type theory - A high-level
language for invariant mathematics (March 2019):
Homotopy type theory is a high-level abstract
framework for working with sameness.
Sameness:
Two groups are the same if they are isomorphic
Two topological spaces are the same if they are homeomorphic
Two categories are the same if they are equivalent
Two λ-terms are the same if they are convertible to one another
Two sets are the same if they have the same extension
Two mappings are homotopically the same if one can be
continuously deformed into the other

Coffee cup and donut: the same?
“An often-repeated mathematical joke is that topologists can’t tell the
difference between a coffee cup and a donut, since a sufﬁciently
pliable donut could be reshaped to the form of a coffee cup by
creating a dimple and progressively enlarging it, while preserving the
donut hole in the cup’s handle.” (Wikipedia)

Associating groups to topological spaces
“In modern mathematics it is common to study a category by
associating to every object of this category a simpler object that
still retains sufﬁcient information about the object of interest.
Homotopy groups are such a way of associating groups to
topological spaces.
That link between topology and groups lets mathematicians
apply insights from group theory to topology. ” (Wikipedia)

Calculation of fundamental groups
“Homotopy groups are used in algebraic topology to classify
topological spaces. The ﬁrst and simplest homotopy group is
the fundamental group, which records information about loops
in a space. Intuitively, homotopy groups record information
about the basic shape, or holes, of a topological space.
Topological spaces with differing homotopy groups are never
equivalent (homeomorphic), but topological spaces that are not
homeomorphic can have the same homotopy groups.
Calculation of homotopy groups is in general much
more difﬁcult than some of the other homotopy invariants
learned in algebraic topology. ” (Wikipedia)

Calculation of fundamental groups of surfaces

Fundamental Group of Circle S1
We show a surprising connection between the labelled
natural deduction theory developed by now, which has
been developed by the use of computational paths as
labels and the use of LNDEQ-TRS as the logical rules
between these computational paths. We now show a
surprising connection: it is possible to use this system
to obtain one of the main results of algebraic topology:
the calculation of the fundamental group of the circle.
A Topological Application of Labelled Natural Deduction. Tiago
M. L.Veras, Arthur F. Ramos, R. J. G. B. de Q., Anjolina G. de
Oliveira (2019) https://arxiv.org/abs/1906.09105

Computational Paths as part of the syntax
Definition (The circle S1)
The circle is the type generated by:
(i) A base point - x0 : S1
(ii) A base computational path - x0 =
loop
x0 : S1.
The first thing one should notice is that this definition does not use
only the points of the type S1
, but also a base computational path
called loop between those points. That is why it is called a higher
inductive type . Our approach differs from the one developed in
the HoTT book on the fact that we do not need to simulate the
path-space between those points, since we add
computational paths to the syntax of the theory.

Building Bridges! Opening (new) Paths!
Computation– (Algebraic) Topology–Logic–(Higher) Categories–(Higher) Algebra
A single concept may serve as a bridging bond: path
Computation: convertibility between λ-terms
(Algebraic) Topology: homotopy theory
Logic: proofs of equality
(Higher) Categories: polycategories
(Higher) Algebra: ∞-groupoids
Paths as structure-preserving maps.
Path equivalences: homotopy theory

Equality in λ-Calculus: convertibility
Proofs of equality as (reversible) sequences of contractions, i.e. paths
Church’s (1936) original λ-calculus paper:
NB: equality as the reﬂexive, symmetric and transitive closure of
1-step contraction: symmetric closure of rewriting paths.

Equality in λ-Calculus: composition of definitional
contractions
Proofs of equality: paths
Definition (Hindley & Seldin 2008)
P is βη-equal or βη-convertible to Q (notation P =βη Q) iff Q is
obtained from P by a finite (perhaps empty) series of
β-contractions, η-contractions, reversed β-contractions,
reversed η-contractions, or changes of bound variables. That is,
P =β Q iff there exist P0, . . . , Pn (n ≥ 0) such that
P0 ≡ P, Pn ≡ Q,
(∀i ≤ n − 1) (Pi 1β Pi+1 or Pi+1 1β Pi
or Pi 1η Pi+1 or Pi+1 1η Pi
or Pi ≡α Pi+1).

Curry-Howard Interpretation: Intuitionistic Type Theory
‘Formulae-as-Types’, ‘Proofs-as-Programs’
(1934) H. Curry came up with an early version of type inference
for the combinators of Combinatory Logic. The types of
combinators could be seen as axioms of implicational logic:
‘α → β’ could be read as
(1) ‘the type of functions from type α to type β’ ;
(2) ‘the formula “α implies β” ’.
Axioms of Implicational Logic:
α → α
α → β → α
(α → β → γ) → (α → β) → α → γ
Types of Combinators:
I : α → α
K : α → β → α
S : (α → β → γ) → (α → β) → α → γ

Curry-Howard Interpretation: Intuitionistic Type Theory
‘Formulae-as-Types’, ‘Proofs-as-Programs’
(1969) W. Howard came up with an extension of Curry’s
functionality interpretation to full intuitionistic predicate logic:
⊥ as ∅ (empty type)
α ∧ β as α × β (product)
α ∨ β as α + β (sum)
∀xγ as Πxγ (dependent product)
∃xγ as Σxγ (dependent sum)
(1972) P. Martin-L¨of came up with Type Theory extending
Howard’s Formulae-as-Types with Natural Numbers and
Universes.
(1973) P. Martin-L¨of came up with Intuitionistic Type Theory
extending Type Theory with Identity Types.

Identity Types
Identity Types - Topological and Categorical Structure
Workshop, Uppsala, November 13–14, 2006:
“The identity type, the type of proof objects for the fundamental
propositional equality, is one of the most intriguing constructions of
intensional dependent type theory (also known as Martin-L¨of type
theory). Its complexity became apparent with the Hofmann–Streicher
groupoid model of type theory. This model also hinted at some
possible connections between type theory and homotopy theory and
higher categories. Exploration of this connection is intended to be the
main theme of the workshop.”
Michael Shulman’s (2017) ‘Homotopy type theory: the logic of
space’: “For many years, the most mysterious part of Martin-L¨of’s
type theory was the identity types “x = y”.”

Type Theory and Derivations-as-Terms
Howard on the so-called Curry-Howard ‘Formulae-as-Types’
“ [de Bruijn] discovered the idea of derivations as
terms, and the accompanying idea of
formulae-as-types, on his own. (...)
Martin-L¨of suggested that the derivations-as-terms
idea would work particularly well in connection with
Prawitz’s theory of natural deduction.”
(W.Howard, Wadler’s Blog, 2014)
1-step contraction originating from logic: contractions in
redundant proofs correspond to contractions in redundant
terms.
Curry-Howard ‘Formulae-as-Types’:
Proof equivalence ←→ Term equivalence

Type Theory
Hausdorff Trimester: Types, Sets and Constructions, May 2 – Aug 24, 2018, Unn Bonn
“Type theory, originally conceived as a bulwark against the paradoxes
of naive set theory, has languished for a long time in the shadow of
axiomatic set theory which became the mainstream foundation of
mathematics. The first renaissance of type theory occurred with the
advent of computer science and Bishop’s development of a
practice-oriented constructive mathematics. It was followed by a
second quite recent one that not only champions type theory as a
central framework for achieving the goal of fully formalized
mathematics amenable to verification by computer-based proof
assistants, but also finds deep and unexpected connections between
type theory and homotopy theory. ”

Type Theory
Hausdorff Trimester: Types, Sets and Constructions, May 2 – Aug 24, 2018, Unn Bonn
“Constructive set theory and mathematics distinguishes itself from its
traditional counterpart, classical set theory and mathematics based
on it, by insisting that proofs of existential theorems must afford
means for constructing an instance. Constructive reasoning emerges
naturally in core areas of mathematics and in the theory of
computation. The aim of the Hausdorff Trimester is to create a forum
for research on and dissemination of exciting recent developments,
which are of central importance to modern foundations of
mathematics.”

Homotopy Type Theory
Open Source Book
Institute for Advanced Study, Princeton, 2013 (approx. 600p)
Open-source book: The Univalent Foundations Program
27 main participants. 58 contributors
Available on GitHub. Latest version April 15, 2020
version marker: ﬁrst-edition-1257-gdc4966e

Open Source Book
“Homotopy type theory is a new branch of mathematics that
combines aspects of several different ﬁelds in a surprising way. It is
based on a recently discovered connection between homotopy theory
and type theory. Homotopy theory is an outgrowth of algebraic
topology and homological algebra, with relationships to higher
category theory; while type theory is a branch of mathematical logic
and theoretical computer science. Although the connections between
the two are currently the focus of intense investigation, it is
increasingly clear that they are just the beginning of a subject that will
take more time and more hard work to fully understand. It touches on
topics as seemingly distant as the homotopy groups of spheres, the
algorithms for type checking, and the deﬁnition of weak ∞-groupoids.”

Origins of Research Programme
Vladimir Voevodsky (IAS, Princeton) (b. 4 June 1966 – d. 30
September 2017)
1st
(?) use of term ‘homotopy λ-calculus’: tech report Notes on
homotopy λ-calculus (Started Jan 18, Feb 11, 2006): “In this paper
we suggest a new approach to the foundations of mathematics. (...)
A key development (totally unnoticed by the mathematical
community) occurred in the 70-ies when the typed λ-calculus
was enriched by the concept of dependent types.”
Steve Awodey (Dept Phil, CMU)
1st
(?) use of term ‘homotopy type theory’: Eighty-sixth Peripatetic
Seminar on Sheaves and Logic, Nancy, 8–9 September 2007

HoTT Approach to Spaces: New Proofs
“Homotopy type theory: towards Grothendieck’s dream”, M. Shulman, 2013 Int.
Category Theory conference, Sydney
“Progress in synthetic homotopy theory:
• π1(S1
) = Z (Shulman, Licata)
• πk (Sn
) = 0 for k < n (Brunerie, Licata)
• πn(Sn
) = Z (Licata, Brunerie)
• The long exact sequence of a ﬁbration (Voevodsky)
• The Hopf ﬁbration and π3(S2
) = Z (Lumsdaine, Brunerie)
• The Freudenthal suspension theorem (Lumsdaine)
• The Blakers–Massey theorem (Lumsdaine, Finster, Licata)
• The van Kampen theorem (Shulman)
• Whitehead’s theorem for n-types (Licata)
• Covering space theory (Hou) ”
“Homotopy type theory can also serve as a foundational system
for mathematics whose basic objects are ∞-groupoids rather
than sets.”

Algebraic Topology and Fundamental Groups
Calculation of Fundamental Groups
“One of the main ideas of algebraic topology is to consider two
spaces to be equivalent if they have ‘the same shape’ in a sense that
is much broader than homeomorphism.” (...)
“The fundamental group of a space X will be defined so that its
elements are loops in X starting and ending at a fixed basepoint
x0 ∈ X, but two such loops are regarded as determining the same
element of the fundamental group if one loop can be continuously
deformed to the other within the space X”. (...)
“One can often show that two spaces are not homeomorphic by
showing that their fundamental groups are not isomorphic, since it will
be an easy consequence of the definition of the fundamental group
that homeomorphic spaces have isomorphic fundamental groups.”
Algebraic Topology, Allan Hatcher, Cornell Univ, 2001

Computational Paths: New Proofs
Calculation of Fundamental Groups
Calculation of Fundamental Groups of Surfaces:
circle
cylinder
M¨obius band
torus
two-holed torus
real projective plane
Van Kampen theorem
T. M. L. de Veras, A. F. Ramos, R. J. G. B. de Queiroz, A. G. de
Oliveira, On the Calculation of Fundamental Groups in
Homotopy Type Theory by Means of Computational Paths,
arXiv 1804.01413

Type Theory and Homotopy Theory
Steve Awodey: a calculus to reason about abstract homotopy
“Homotopy type theory is a new field devoted to a recently discovered
connection between Logic and Topology – more specifically, between
constructive type theory, which was originally invented as a
constructive foundation for mathematics and now has many
applications in the theory of programming languages and formal proof
verification, and homotopy theory, a branch of algebraic topology
devoted to the study of continuous deformations of geometric spaces
and mappings. The basis of homotopy type theory is an interpretation
of the system of intensional type theory into abstract homotopy
theory. As a result of this interpretation, one can construct new kinds
of models of constructive logic and study that system semantically,
e.g. proving consistency and independence results. Conversely,
constructive type theory can also be used as a formal calculus to
reason about abstract homotopy.”
(A proposition is the (homotopy) type of its proofs, Jan 2016.)

The Functional Interpretation of Equality
Sequences of contractions
(λx.(λy.yx)(λw.zw))v 1η (λx.(λy.yx)z)v 1β (λy.yv)z 1β zv
(λx.(λy.yx)(λw.zw))v 1β (λx.(λw.zw)x)v 1η (λx.zx)v 1β zv
(λx.(λy.yx)(λw.zw))v 1β (λx.(λw.zw)x)v 1β (λw.zw)v 1η zv
There is at least one sequence of contractions from the initial term to
the ﬁnal term. Thus, in the formal theory of λ-calculus, the term
(λx.(λy.yx)(λw.zw))v is declared to be equal to zv.
Now, some natural questions arise:
1 Are the sequences themselves normal?
2 What are the non-normal sequences?
3 How are the latter to be identiﬁed and (possibly) normalised?

Brouwer–Heyting–Kolmogorov Interpretation
Proofs rather than truth-values
a proof of the proposition: is given by:
A ∧ B a proof of A and
a proof of B
A ∨ B a proof of A or
a proof of B
A → B a function that turns a proof of A
into a proof of B
∀x.P(x) a function that turns an element a
into a proof of P(a)
∃x.P(x) an element a (witness)
and a proof of P(a)

What is a proof of an equality statement?
t1 = t2 ?
(Perhaps a path from t1 to t2?)
What is the logical status of the symbol “=”?
What would be a canonical/direct proof of t1 = t2?
What is an equality between paths?
What is an equality between homotopies (i.e., paths between
paths)?

Type Theory and Equality
Proposition vs Judgements
In type theory, two main kinds of judgements:
1 x : A
2 x = y : A
Via the so-called Curry-Howard interpretation, “x : A” can be read as
“x is a proof of proposition A”.
Also, “x = y : A” can be read as “x and y are (deﬁnitionally) equal
proofs of proposition A”.
What about the judgement of “p is a proof of the statement that x and
y are equal elements of type A”? This is where the so-called Identity
type comes into the picture:
p : IdA(x, y)

Type Theory and Equality
Explicit Terms for Paths
Those paths are not part of the syntax of type theory. This is
clear from an answer given by Vladimir Voevodsky for the
following question in a short interview (22 Oct 2015):
- Martin Escardò: What was your first reaction when
you first saw the type of identity? Did you immediately
connect it with path spaces?
- Vladimir Voevodsky: Not at all. I did not make this
connection until late 2009. All the time before it I
was hypnotized by the mantra that the only
inhabitant of the Id type is reflexivity which made
it useless from my point of view.

What is the formal counterpart of a proof of an equality?
In talking about proofs of an equality statement, two dichotomies
arise:
1 deﬁnitional equality versus propositional equality
2 intensional equality versus extensional equality
First step on the formalisation of proofs of equality statements: Per
Martin-L¨of’s Intuitionistic Type Theory (Log Coll ’73, published 1975)
with the so-called Identity Type

Identity Types
Type Theory and Homotopy Theory
The groupoid structure exposed in the Hofmann–Streicher (1994)
countermodel to the principle of Uniqueness of Identity Proofs (UIP).
In Hofmann & Streicher’s own words,
“We give a model of intensional Martin-L¨of type theory
based on groupoids and ﬁbrations of groupoids in which
identity types may contain two distinct elements which are
not even propositionally equal. This shows that the principle
of uniqueness of identity proofs is not derivable in the
syntax”.
(M Hofmann, T Streicher, “The groupoid model refutes uniqueness of
identity proofs”. In Logic in Computer Science, 1994 (LICS’94), pp.
208–212.)

Identity Types
Identity Types as Topological Spaces
“All of this work can be seen as an elaboration of the
following basic idea: that in Martin-L¨of type theory, a type A
is analogous to a topological space; elements a, b ∈ A to
points of that space; and elements of an identity type
p, q ∈ IdA(a, b) to paths or homotopies p, q : a → b in A.”.
(B. van den Berg and R. Garner, “Topological and simplicial models of
identity types”, ACM Transactions on Computational Logic, Jan 2012)

Identity Types
Identity Types as Topological Spaces
From the Homotopy type theory collective book (2013):
“In type theory, for every type A there is a (formerly
somewhat mysterious) type IdA of identiﬁcations of two
objects of A; in homotopy type theory, this is just the path
space AI
of all continuous maps I → A from the unit
interval. In this way, a term p : IdA(a, b) represents a path
p : a b in A.”

Identity Types: Iteration
From Propositional to Predicate Logic and Beyond
In the same aforementioned workshop, B. van den Berg in his
contribution “Types as weak omega-categories” draws attention to the
power of the identity type in the iterating types to form a globular set:
“Fix a type X in a context Γ. Define a globular set as follows:
A0 consists of the terms of type X in context Γ,modulo
definitional equality; A1 consists of terms of the types
Id(X; p; q) (in context Γ) for elements p, q in A0, modulo
definitional equality; A2 consists of terms of well-formed
types Id(Id(X; p; q); r; s) (in context Γ) for elements p, q in
A0, r, s in A1, modulo definitional equality; etcetera...”

The homotopy interpretation
Here is how we can see the connections between proofs of equality
and homotopies:
a, b : A
p, q : IdA(a, b)
α, β : IdIdA(a,b)(p, q)
· · · : IdIdId...
(· · · )
Now, consider the following interpretation:
Types Spaces
Terms Maps
a : A Points a : 1 → A
p : IdA(a, b) Paths p : a ⇒ b
α : IdIdA(a,b)(p, q) Homotopies α : p q

The homotopy interpretation (Awodey (2016))
point, path, homotopy, ...

Identity Types
Univalent Foundations of Mathematics
From Vladimir Voevodsky (IAS, Princeton) “Univalent
Foundations: New Foundations of Mathematics”, Mar 26, 2014:
“There were two main problems with the existing
foundational systems which made them inadequate.
Firstly, existing foundations of mathematics were
based on the languages of Predicate Logic and
languages of this class are too limited.
Secondly, existing foundations could not be used to
directly express statements about such objects as, for
example, the ones that my work on 2-theories was
about.”

The Homotopy Interpretation
Steve Awodey (2016): a “logic of homotopies”
“The homotopy interpretation was ﬁrst proposed by the
present author and worked out formally (with a student) in
terms of Quillen model categories – a modern, axiomatic
setting for abstract homotopy theory that encompasses not
only the classical homotopy theory of spaces and their
combinatorial models like simplicial sets, but also other,
more exotic notions of homotopy (...). These results show
that intensional type theory can in a certain sense be
regarded as a “logic of homotopy”, in that the system can
be faithfully represented homotopically, and then used to
reason formally about spaces, continuous maps,
homotopies, and so on. ”
(A proposition is the (homotopy) type of its proofs, Jan 2016.)

Propositional Equality
Proofs of equality as (rewriting) computational paths
What is a proof of an equality statement? In what sense it can be
seen as a homotopy? Motivated by looking at equalities in type
theory as arising from the existence of computational paths between
two formal objects, it may be useful to review the role and the power
of the notion of propositional equality as formalised in the so-called
Curry–Howard functional interpretation.
The main idea, namely, proofs of equality statements as (reversible)
sequences of rewrites, i.e. paths, goes back to a paper entitled
“Equality in labelled deductive systems and the functional
interpretation of propositional equality”, presented in Dec 1993 at the
9th Amsterdam Colloquium, and published in the proceedings in
1994.

BHK for Identity Types
Types and Propositions
(source: Awodey (2016))
types vs propositions:
sum/coproduct vs disjunction,
product vs conjunction,
function space vs implication
dependent sum vs existential quantiﬁer,
dependent product vs universal quantiﬁer
path space (?) vs equality symbol

t1 = t2 ?
(Perhaps a sequence of rewrites
starting from t1 and ending in t2?)
What is the logical status of the symbol “=”?
What would be a canonical/direct proof of t1 = t2?

The Functional Interpretation of Direct Computations
Propositional Equality: The Groupoid Laws
With the formulation of propositional equality that we have just
deﬁned, we can also prove that all elements of an identity type
obey the groupoid laws, namely
1 Associativity
2 Existence of an identity element
3 Existence of inverses
Also, the groupoid operation, i.e. composition of
paths/sequences, is actually, partial, meaning that not all
elements will be connected via a path. (The groupoid
interpretation refutes the Uniqueness of Identity Proofs.)

Propositional Equality: The Uniqueness of Identity Proofs
“We will call UIP (Uniqueness of Identity Proofs) the
following property. If a1, a2 are objects of type A then for
any proofs p and q of the proposition “a1 equals a2” there is
another proof establishing equality of p and q. (...) Notice
that in traditional logical formalism a principle like UIP
cannot even be sensibly expressed as proofs cannot
be referred to by terms of the object language and thus
are not within the scope of propositional equality.”
Martin Hofmann and Thomas Streicher, “The groupoid
interpretation of type theory”, Twenty-ﬁve years of constructive
type theory (Venice, 1995), Oxford Logic Guides, vol. 36,
Oxford Univ. Press, New York, 1998, pp. 83–111.

Sequences of contractions
(λx.(λy.yx)(λw.zw))v 1η (λx.(λy.yx)z)v 1β (λy.yv)z 1β zv
(λx.(λy.yx)(λw.zw))v 1β (λx.(λw.zw)x)v 1η (λx.zx)v 1β zv
(λx.(λy.yx)(λw.zw))v 1β (λx.(λw.zw)x)v 1β (λw.zw)v 1η zv
There is at least one sequence of contractions from the initial term to
the ﬁnal term. (In this case we have given three!) Thus, in the formal
theory of λ-calculus, the term (λx.(λy.yx)(λw.zw))v is declared to be
equal to zv.
Now, some natural questions arise:
1 Are the sequences themselves normal?
2 Are there non-normal sequences?
3 If yes, how are the latter to be identiﬁed and (possibly)
normalised?
4 What happens if general rules of equality are involved?

Propositional equality
P is β-equal or β-convertible to Q (notation P =β Q) iff Q is
obtained from P by a ﬁnite (perhaps empty) series of
β-contractions and reversed β-contractions and changes of
bound variables. That is, P =β Q iff there exist P0, . . . , Pn
(n ≥ 0) such that
P0 ≡ P, Pn ≡ Q,
(∀i ≤ n − 1)(Pi 1β Pi+1 or Pi+1 1β Pi or Pi ≡α Pi+1).
NB: equality with an existential force.
NB: equality as the reﬂexive, symmetric and transitive closure
of 1-step contraction: arising from rewriting

The Functional Interpretation of Direct Computation
Equality: Existential Force and Rewriting Path
The same happens with λβη-equality:
Deﬁnition 7.5 (λβη-equality) (Hindley & Seldin 2008)
The equality-relation determined by the theory λβη is
called =βη; that is, we deﬁne
M =βη N ⇔ λβη M = N.
Note again that two terms are λβη-equal if there exists a proof
of their equality in the theory of λβη-equality.

Gentzen’s ND for propositional equality
Remark
In setting up a set of Gentzen’s ND-style rules for equality we
need to account for:
1 definitional versus propositional equality;
2 there may be more than one normal proof of a certain
equality statement;
3 given a (possibly non-normal) proof, the process of
bringing it to a normal form should be finite and confluent.

Equality in Type Theory
Martin-Löf’s Intuitionistic Type Theory:
Intensional (1975)
Extensional (1982(?), 1984)
Remark (Definitional vs. Propositional Equality)
definitional, i.e. those equalities that are given as rewrite
rules, orelse originate from general functional principles
(e.g. β, η, ξ, µ, ν, etc.);
propositional, i.e. the equalities that are supported (or
otherwise) by an evidence (a sequence of substitutions
and/or rewrites)

Deﬁnitional Equality
(α) λx.M = λy.[y/x]M (y /∈ FV(M))
(β) (λx.M)N = [N/x]M
(η) (λx.Mx) = M (x /∈ FV(M))
(ξ)
M = M
λx.M = λx.M
(µ)
M = M
NM = NM
(ν)
M = M
MN = M N
(ρ) M = M
(σ)
M = N
N = M
(τ)
M = N N = P
M = P

Intuitionistic Type Theory
→-intro
[x : A]
f(x) = g(x) : B
λx.f(x) = λx.g(x) : A → B
(ξ)
→-elim
x = y : A g : A → B
gx = gy : B
(µ)
→-elim
x : A g = h : A → B
gx = hx : B
(ν)
→-reduc
a : A
[x : A]
b(x) : B
(λx.b(x))a = b(a/x) : B
(β)
c : A → B
λx.cx = c : A → B
(η)

Lessons from Curry–Howard and Type Theory
Harmonious combination of logic and λ-calculus;
Proof terms as ‘record of deduction steps’, i.e.
‘deductions-as-terms’
Function symbols as ﬁrst class citizens.
Cp.
∃xF(x)
[F(t)]
C
C
with
p : ∃xF(x)
[t : D, g(t) : F(t)]
h(g, t) : C
? : C
in the term ‘?’ the variable g gets abstracted from, and this enforces a
kind of generality to g, even if this is not brought to the ‘logical’ level.

Equality in Martin-L¨of’s Intensional Type Theory
A type a : A b : A
Idint
A (a, b) type
Idint
-formation
a : A
r(a) : Idint
A (a, a)
Idint
-introduction
a = b : A
r(a) : Idint
A (a, b)
Idint
-introduction
a : A b : A c : Idint
A (a, b)
[x:A]
d(x):C(x,x,r(x))
[x:A,y:A,z:Idint
A (x,y)]
C(x,y,z) type
J(c, d) : C(a, b, c)
Idint
-elimination
a : A
[x : A]
d(x) : C(x, x, r(x))
[x : A, y : A, z : Idint
A (x, y)]
C(x, y, z) type
J(r(a), d(x)) = d(a/x) : C(a, a, r(a))
Idint
-equality

Equality in Martin-L¨of’s Extensional Type Theory
A type a : A b : A
Idext
A (a, b) type
Idext
-formation
a = b : A
r : Idext
A (a, b)
Idext
-introduction
c : Idext
A (a, b)
a = b : A
Idext
-elimination
c : Idext
A (a, b)
c = r : Idext
A (a, b)
Idext
-equality

The missing entity
Considering the lessons learned from Type Theory, the
judgement of the form:
a = b : A
which says that a and b are equal elements from domain D, let
us add a function symbol:
a =s b : A
where one is to read: a is equal to b because of ‘s’ (‘s’ being the
rewrite reason); ‘s’ is a term denoting a sequence of equality
identiﬁers (β, η, ξ, etc.), i.e. a composition of rewrites. In other
words, ‘s’ is the (explicit) computational path from a to b.
(This formal entity is missing in both of Martin-L¨of’s
formulations of Identity Types.)

HoTT Book
Path terms are not in the syntax, thus: Encode-Decode Method
“To characterize a path space, the first step is to
define a comparison fibration “code” that provides a
more explicit description of the paths.”
(...)
“There are several different methods for proving that
such a comparison fibration is equivalent to the paths
(we show a few different proofs of the same result in
§8.1). The one we have used here is called the
encode-decode method: the key idea is to define
decode generally for all instances of the fibration (i.e.
as a function Π(x:A+B)code(x) → (inl(a0) = x)), so that
path induction can be used to analyze
decode(x, encode(x, p)).” (section 2.12, p. 95)

Propositional Equality
Id-introduction
a =s b : A
s(a, b) : IdA(a, b)
Id-elimination
m : IdA(a, b)
[a =g b : A]
h(g) : C
J(m, λg.h(g)) : C
Id-reduction
a =s b : A
s(a, b) : IdA(a, b)
Id-intr
[a =g b : A]
h(g) : C
J(s(a, b), λg.h(g)) : C
Id-elim
β
[a =s b : A]
h(s/g) : C

Propositional Equality: A Simple Example of a Proof
By way of example, let us prove
ΠxA
ΠyA
(IdA(x, y) → IdA(y, x))
[p : IdA(x, y)]
[x =t y : A]
y =σ(t) x : A
(σ(t))(y, x) : IdA(y, x)
J(p, λt(σ(t))(y, x)) : IdA(y, x)
λp.J(p, λt(σ(t))(y, x)) : IdA(x, y) → IdA(y, x)
λy.λp.J(p, λt(σ(t))(y, x)) : ΠyA(IdA(x, y) → IdA(y, x))
λx.λy.λp.J(p, λt(σ(t))(y, x)) : ΠxAΠyA(IdA(x, y) → IdA(y, x))

Normal form for the rewrite reasons
Strategy:
Analyse possibilities of redundancy
Construct a rewriting system
Prove termination and conﬂuence

Definition (equation)
An equation in our LNDEQ is of the form:
s =r t : A
where s and t are terms, r is the identifier for the rewrite reason, and
A is the type (formula).
Definition (system of equations)
A system of equations S is a set of equations:
{s1 =r1
t1 : A1, . . . , sn =rn
tn : An}
where ri is the rewrite reason identifier for the ith equation in S.

Deﬁnition (rewrite reason)
Given a system of equations S and an equation s =r t : A, if
S s =r t : A, i.e. there is a deduction/computation of the
equation starting from the equations in S, then the rewrite
reason r is built up from:
(i) the constants for rewrite reasons: { ρ, σ, τ, β, η, ν, ξ, µ };
(ii) the ri’s;
using the substitution operations:
(iii) subL;
(iv) subR;
and the operations for building new rewrite reasons:
(v) σ, τ, ξ, µ.

Definition (general rules of equality)
The general rules for equality (reflexivity, symmetry and
transitivity) are defined as follows:
x : A
x =ρ x : A
(reflexivity)
x =t y : A
y =σ(t) x : A
(symmetry)
x =t y : A y =u z : A
x =τ(t,u) z : A
(transitivity)

Deﬁnition (subterm substitution)
The rule of “subterm substitution” is split into two rules:
x =r C[y] : A y =s u : A
x =subL(r,s) C[u] : A
x =r w : A C[w] =s u : A
C[x] =subR(r,s) u : A
where C[x] is the context in which the subterm x appears

Reductions
Deﬁnition (reductions involving ρ and σ)
x =ρ x : A
x =σ(ρ) x : A
sr x =ρ x : A
x =r y : A
y =σ(r) x : A
x =σ(σ(r)) y : A
ss x =r y : A
Associated rewritings:
σ(ρ) sr ρ
σ(σ(r)) ss r

Reductions
Deﬁnition (reductions involving τ)
x=r y:D y=σ(r)x:D
x=τ(r,σ(r))x:D tr x =ρ x : D
y=σ(r)x:D x=r y:D
y=τ(σ(r),r)y:D tsr y =ρ y : D
u=r v:D v=ρv:D
u=τ(r,ρ)v:D rrr u =r v : D
u=ρu:D u=r v:D
u=τ(ρ,r)v:D lrr u =r v : D
Associated rewrites: τ(r, σ(r)) tr ρ, τ(σ(r), r) tsr ρ, τ(r, ρ) rrr r,
τ(ρ, r) lrr r.

Reductions
Deﬁnition
βrewr -×-reduction
x =r y : A z : B
x, z =ξ1(r) y, z : A × B
× -intr
FST( x, z ) =µ1(ξ1(r)) FST( y, z ) : A
× -elim
mx2l1 x =r y : A
Associated rewriting:
µ1(ξ1(r)) mx2l1 r

Reductions
Deﬁnition
βrewr -×-reduction
x =r x : A y =s z : B
x, y =ξ∧(r,s) x , z : A × B
× -intr
FST( x, y ) =µ1(ξ∧(r,s)) FST( x , z ) : A
× -elim
mx2l2 x =r x : A
Associated rewriting:
µ1(ξ∧(r, s)) mx2l2 r

Categorical Interpretation of Computational Paths
Computational Paths form a Weak Category
Theorem
For each type A, computational paths induce a weak
categorical structure Arw where:
objects: terms a of the type A, i.e., a : A
morphisms: a morphism (arrow) between terms a : A and
b : A are arrows s : a → b such that s is a computational
path between the terms, i.e., a =s b : A.
Corollary
Arw has a weak groupoidal structure.

Publications
Recent publications:
1 R. J. G. B. de Queiroz, A. G. de Oliveira and A. F. Ramos.
Propositional equality, identity types, and direct computational
types. Special issue of South American Journal of Formal Logic
(ISSN: 2446-6719) entitled “Logic and Applications: in honor to
Francisco Miraglia by the occasion of his 70th birthday”, M.
Coniglio & H. L. Mariano (eds.), 2(2):245–296, December 2016.
2 T. L. M. de Veras, A. F. Ramos, R. J. G. B. de Queiroz, A. G. de
Oliveira. An alternative approach to the calculation of
fundamental groups based on labeled natural deduction.
arXiv:1906.09107
Oliveira. A Topological Application of Labelled Natural
Deduction. arXiv:1906.09105

Publications
Recent publications (cont’d):
Oliveira. On the Calculation of Fundamental Groups in
Homotopy Type Theory by Means of Computational Paths.
arXiv:1804.01413
2 A. F. Ramos, R. J. G. B. de Queiroz, A. G. de Oliveira. On The
Identity Type as The Type of Computational Paths. EBL’14
special issue of Logic Journal of the IGPL, Oxford Univ Press,
Published online 26 June 2017.
3 A. F. Ramos, R. J. G. B. de Queiroz, A. G. de Oliveira. On the
Groupoid Model of Computational Paths. arXiv:1506.02721

Computational Paths and the Calculation of Fundamental Groups

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