PowerPedia:Incompleteness Theorem

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The inompleteness theorem states that a formal axiomatic system must be either incomplete, if it is consistent, or inconsistent if it is complete. Developed in mathematical logic, Gödel's incompleteness theorems are two celebrated theorems about the limitations of formal systems proved by Kurt Gödel in 1931. These theorems show that there is no complete, consistent formal system that correctly describes the natural numbers, and that no sufficiently strong system describing the natural numbers can prove its own consistency. These theorems are widely regarded as showing that Hilbert's program to find a complete and consistent set of axioms for all of mathematics is impossible. The theorems have also been interpreted in philosophy and popular culture. It's direct implications fro free eenrgy research is that perpetual motion may be possible. Perpetual motion is constant change.

First incompleteness theorem

Gödel's first incompleteness theorem is perhaps the most celebrated result in mathematical logic. It states that

For any consistent formal theory that proves basic arithmetical truths, an arithmetical statement that is trueTemplate:Rf but not provable in the theory can be constructed. That is, any theory capable of expressing elementary arithmetic cannot be both consistent and complete.

Here, "theory" refers to an infinite set of statements, some of which are taken as true without proof (these are called axioms), and others (the theorems) that are taken as true because they are implied by the axioms. "Provable in the theory" means "derivable from the axioms and primitive notions of the theory, using standard first order logic". A theory is "consistent" if it never proves a contradiction. "Can be constructed" means that some mechanical procedure exists which can construct the statement, given the axioms, primitives, and first order logic. The resulting true but unprovable statement is often referred to as "the Gödel sentence" for that theory. In fact, there are infinitely many statements in the theory that share with the Gödel sentence the property of being true but not provable from the theory. "Elementary arithmetic" consists merely of addition and multiplication over the natural numbers.

Some technical hypotheses have been omitted here; the most important one is the stipulation that the theory be computably enumerable. That is, for Gödel's theorem to be applicable, it must be possible in principle to write a computer program that, if allowed to run forever, would:

• Prove all theorems of the theory and nothing else;
• Decide whether any statement is a substitution instance of an axiom of the theory.

Gödel's theorem

Gödel's theorem appears as Proposition VI in his 1931 paper "On Formally Undecidable Propositions in Principia Mathematica and Related Systems I." It states:

To every ω-consistent recursive class κ of formulas there correspond recursive class signs r, such that neither v Gen r nor Neg(v Gen r) belongs to Flg(κ) (where v is the free variable of r).

Roughly speaking, the Gödel statement, G, can be expressed: 'G cannot be proven true'. If G were proven true under the theory's axioms, then the theory would have a theorem, G, which contradicts itself. A similar contradiction would occur if G could be proven false. So we are forced to conclude that G cannot be proven true or false, but is true because of this very fact.

The demonstration just given is in ordinary English and thus not mathematically rigorous. In order to provide a well-defined demonstration, Gödel represents statements by numbers; then the theory, which is already about numbers, also pertains to statements, including its own. Questions about the provability of statements are represented as mathematically definable questions about the properties of numbers, which would be decidable by the theory if it were complete. In these terms, the Gödel sentence is a claim that there does not exist a natural number with a certain property. A number with that property would be a proof of inconsistency of the theory. If there were such a number then the theory would be inconsistent, contrary to hypothesis. So there is no such number, and the Gödel statement is true, but the theory cannot prove it.

Gödel demonstrated the incompleteness of a theory of arithmetic, but it is clear that the demonstration could be given for any theory and language of a certain expressiveness.

Gödel's original statement and proof of the incompleteness theorem requires the assumption that the theory is not just consistent but ω-consistent. A theory is ω-consistent if it is not ω-inconsistent, and is ω-inconsistent if there is a predicate P such that for every specific natural number n the theory proves ~P(n), and yet the theory also proves that there exists a natural number n such that P(n). That is, the theory says that a number with property P exists while denying that it has any specific value. The ω-consistency of a theory implies its consistency, but consistency does not imply ω-consistency. J. Barkley Rosser later strengthened the incompleteness theorem by finding a variation of the proof that does not require the theory to be ω-consistent. This is mostly of technical interest, since all true formal theories of arithmetic, that is, theories with only axioms that are true statements about natural numbers, are ω-consistent and thus Gödel's theorem as originally stated applies to them. The version of the incompleteness theorem that only assumes consistency, not ω-consistency, is now commonly known as Gödels incompleteness theorem.

Second incompleteness theorem

Gödel's second incompleteness theorem can be stated as follows:

For any formal theory T including basic arithmetical truths and also certain truths about formal provability, T includes a statement of its own consistency if and only if T is inconsistent.

(Proof of the "if" part:) If T is inconsistent then anything can be proved, including that T is consistent. (Proof of the "only if" part:) If T is consistent then T does not include the statement of its own consistency. This follows from the first theorem.

There is a technical subtlety involved in the second incompleteness theorem, namely how exactly are we to express the consistency of T in the language of T. There are many ways to do this, and not all of them lead to the same result. In particular, different formalizations of the claim that T is consistent may be inequivalent in T, and some may even be provable. For example, first order arithmetic (Peano arithmetic or PA for short) can prove that the largest consistent subset of PA is consistent. But since PA is consistent, the largest consistent subset of PA is just PA, so in this sense PA "proves that it's consistent". What PA does not prove is that the largest consistent subset of PA is, in fact, the whole of PA. (The term "largest consistent subset of PA" is rather vague, but what is meant here is the largest consistent initial segment of the axioms of PA ordered according to some criteria, e.g. by "Gödel numbers", the numbers encoding the axioms as per the scheme used by Gödel mentioned above).

In case of Peano arithmetic or any familiar explicitly axiomatized theory T, it is possible to define the consistency "Con(T)" of T in terms of the non-existence of a number with a certain property, as follows: "there does not exist an integer coding a sequence of sentences, such that each sentence is either one of the (canonical) axioms of T, a logical axiom, or an immediate consequence of preceding sentences according to the rules of inference of first order logic, and such that the last sentence is a contradiction". However, for arbitrary T there is no canonical choice for Con(T).

The formalization of Con(T) depends on two factors: formalizing the notion of a sentence being derivable from a set of sentences and formalizing the notion of being an axiom of T. Formalizing derivability can be done in canonical fashion, so given an arithmetical formula A(x) defining a set of axioms we can canonically form the predicate Prov_A(P) which expresses that P is provable from the set of axioms defined by A(x). Using this predicate we can express Con(T) as "not Prov_A('P and not-P')". Solomon Feferman showed that Gödel's second incompleteness theorem goes through when the formula A(x) is chosen so that it has the form "there exists a number n satisfying the decidable predicate P" for some P. In addition, Prov_A(P) must satisfy the so-called Hilbert-Bernays provability conditions:

1. If T proves P, then T proves Prov_A(P)

2. T proves 1., i.e. T proves that if T proves P, then T proves Prov_A(P)

3. T proves that if T proves that (P implies Q) then T proves that provability of P implies provability of Q

Gödel's second incompleteness theorem also implies that a theory T₁ satisfying the technical conditions outlined above can't prove the consistency of any theory T₂ which proves the consistency of T₁. This is because then T₁ can prove that if T₂ proves the consistency of T₁, then T₁ is in fact consistent. For the claim that T₁ is consistent has form "for all numbers n, n has the decidable property of not being a code for a proof of contradiction in T₁". If T₁ were in fact inconsistent, then T₂ would prove for some n that n is the code of a contradiction in T₁. But if T₂ also proved that T₁ is consistent, i.e. there is no such n, it would itself be inconsistent. We can carry out this reasoning in T₁ and conclude that if T₂ is consistent, then T₁ is consistent. Since by second incompleteness theorem, T₁ does not prove its consistency, it can't prove the consistency of T₂ either.

This easy corollary of the second incompleteness theorem shows that there is no hope of proving e.g. the consistency of first order arithmetic using finitistic means provided we accept that finitistic means are correctly formalized in a theory the consistency of which is provable in PA. It's generally accepted that the theory of primitive recursive arithmetic (PRA) is an accurate formalization of finitistic mathematics, and PRA is provably consistent in PA. Thus PRA can't prove the consistency of PA. This is generally seen to show that Hilbert's program of validating the use of "ideal" mathematical principles to prove "real" (finitistic) mathematical statements by showing that the "ideal" principles are consistent by finitistically acceptable principles can't be carried out.

This corollary is actually what makes the second incompleteness theorem epistemologically relevant. As Georg Kreisel remarked, it would actually provide no interesting information if a theory T proved its consistency. This is because inconsistent theories prove everything, including their consistency. Thus a consistency proof of T in T would give us no clue as to whether T really is consistent; no doubts about T's consistency would be resolved by such a consistency proof. The interest in consistency proofs lies in the possibility of proving the consistency of a theory T in some theory T' which is in some sense less doubtful than T itself, e.g. weaker than T. For most naturally occurring T and T', such as T = Zermelo-Fraenkel set theory and T' = primitive recursive arithmetic, the consistency of T' is provable in T, and thus T' can't prove the consistency of T by the above corollary of the second incompleteness theorem.

The consistency of first-order arithmetic has been proved assuming that a certain ordinal called ε₀ is wellfounded. See Gentzen's consistency proof.

Meaning of Gödel's theorems

Gödel's theorems are theorems in first-order logic, and must ultimately be understood in that context. In formal logic, both mathematical statements and proofs are written in a symbolic language, one where we can mechanically check the validity of proofs so that there can be no doubt that a theorem follows from our starting list of axioms. In theory, such a proof can be checked by a computer, and in fact there are computer programs that will check the validity of proofs. (Automatic proof verification is closely related to automated theorem proving, though proving and checking the proof are usually different tasks.)

To be able to perform this process, we need to know what our axioms are. We could start with a finite set of axioms, such as in Euclidean geometry, or more generally we could allow an infinite list of axioms, with the requirement that we can mechanically check for any given statement if it is an axiom from that set or not (an axiom schema). In computer science, this is known as having a recursive set of axioms. While an infinite list of axioms may sound strange, this is exactly what's used in the usual axioms for the natural numbers, the Peano axioms: the inductive axiom is in fact an axiom schema — it states that if zero has any property and whenever any natural number has that property, its successor also has that property, then all natural numbers have that property — it does not specify which property and the only way to say in first-order logic that this is true of all properties is to have infinitely many statements.

Gödel's first incompleteness theorem shows that any such system that allows you to define the natural numbers is necessarily incomplete: it contains statements that are neither provably true nor provably false. Or one might say, no formal system which aims to define the natural numbers can actually do so, as there will be true number-theoretical statements which that system cannot prove. This seems to refute the logicism of Gottlob Frege and Bertrand Russell, which aims to reduce/define the natural numbers to/in terms of logic.

The existence of an incomplete system is in itself not particularly surprising. For example, if you take Euclidean geometry and you drop the parallel postulate, you get an incomplete system (in the sense that the system does not contain all the true statements about Euclidean space). A system can be incomplete simply because you haven't discovered all the necessary axioms.

What Gödel showed is that in most cases, such as in number theory or real analysis, you can never create a complete and consistent finite list of axioms, or even an infinite list that can be produced by a computer program. Each time you add a statement as an axiom, there will always be other true statements that still cannot be proved as true, even with the new axiom. Furthermore if the system can prove that it is consistent, then it is inconsistent.

It is possible to have a complete and consistent list of axioms that cannot be produced by a computer program (that is, the list is not computably enumerable). For example, one might take all true statements about the natural numbers to be axioms (and no false statements). But then there is no mechanical way to decide, given a statement about the natural numbers, whether it is an axiom or not.

Gödel's theorem has another interpretation in the language of computer science. In first-order logic, theorems are computably enumerable: you can write a computer program that will eventually generate any valid proof. You can ask if they have the stronger property of being recursive: can you write a computer program to definitively determine if a statement is true or false? Gödel's theorem says that in general you cannot.

Many logicians believe that Gödel's incompleteness theorems struck a fatal blow to David Hilbert's program towards a universal mathematical formalism which was based on Principia Mathematica. The generally agreed upon stance is that the second theorem is what specifically dealt this blow. However some believe it was the first, and others believe that neither did.

Examples of undecidable statements

There are two distinct senses of the word "undecidable" in use. The first of these is the sense used in relation to Gödel's theorems, i.e., that of a statement being neither provable nor refutable, in some specified deductive system. The second sense is used in relation to recursion theory and applies not to statements but to decision problems, which are countably infinite sets of questions each requiring a yes/no answer. Such a problem is said to be undecidable if there is no computable function that correctly answers every question in the problem set. The connection between these two is that if a decision problem is undecidable (in the recursion theoretical sense) then there is no consistent formal system which proves for every question A in the problem either "the answer to A is yes" or "the answer to A is no".

(For this reason, the term "independent" is often preferred to "undecidable", for the "neither provable nor refutable" sense. However "independent" is also ambiguous; some use it to mean just "not provable", and leave open whether an independent statement might be refuted.)

Undecidability of a statement, in a particular deductive system, does not in and of itself address the question of whether the truth value of the statement is well-defined, or whether it can be known. It says only that the particular deductive system being considered does not decide the issue. Whether there exist so-called "absolutely undecidable" statements, whose truth value can never be known or is ill-specified, is a controversial point among various philosophical schools.

The subsequent combined work of Gödel and Paul Cohen has given concrete examples of undecidable statements (statements that, in some specified deductive system, can be neither proved nor disproved): The continuum hypothesis can neither be proved nor refuted in ZFC (the standard axiomatization of set theory), and the axiom of choice can neither be proved nor refuted in ZF (which is all the ZFC axioms except the axiom of choice). These results do not require the incompleteness theorem.

In 1936, Alan Turing proved that the halting problem—the question of whether or not a Turing machine halts on a given program—is undecidable, in the second sense of the term. This result was later generalised in the field of recursive functions to Rice's theorem which shows that all non-trivial properties of recursive functions are undecidable, i.e. there is no recursive function which returns 1 when given a description of a recursive function having the property and returns 0 otherwise. In this context a non-trivial property is one which is true for some, but not all, recursive functions.

In 1973, the Whitehead problem in group theory was shown to be undecidable, in the first sense of the term, in standard set theory. In 1977, Paris and Harrington proved that the Paris-Harrington principle, a version of the Ramsey theorem, is undecidable in the axiomatization of arithmetic given by the Peano axioms but can be proven to be true in the larger system of second-order arithmetic. Kruskal's tree theorem, which has applications in computer science, is also undecidable from the Peano axioms but provable in set theory. In fact Kruskal's tree theorem (or its finite form) is undecidable in a much stronger system codifying the principles acceptable on basis of a philosophy of mathematics called predicativism. Goodstein's theorem is a relatively simple statement about natural numbers that Kirby and Paris showed is undecidable in Peano arithmetic.

Gregory Chaitin produced undecidable statements in algorithmic information theory and in fact proved his own incompleteness theorem in that setting. Chaitin's theorem states that for any theory containing minimal arithmetic, there is an upper bound c (depending on the measure of complexity used) such that no specific number can be proven in that theory to have complexity greater than c. While Godel's theorem is related to the liar paradox, Chaitin's result is related to Berry's paradox.

One of the first problems suspected to be undecidable, in the second sense of the term, was the word problem for groups, first posed by Max Dehn in 1911, which asks if there is a finitely presented group for which no algorithm exists to determine whether two words are equivalent. This was shown to be the case in 1952.

Limitations of Gödel's theorems

The conclusions of Gödel's theorems only hold for the formal systems that satisfy the necessary hypotheses (which have not been fully described in this article). Not all axiom systems do satisfy these hypotheses, even when these systems have models that include the natural numbers as a subset. For example, there are first-order axiomatizations of Euclidean geometry and real closed fields that do not meet the hypotheses of Gödel's theorems. The key fact is that the first-order languages used by these axiomatizations are not expressive enough to define the set of natural numbers or develop basic properties of the natural numbers.

A second limitation is that Gödel's theorems only apply to systems that are used as their own proof systems. Gentzen's work shows the consequences of using a proof theory that is not the same theory, but a more powerful one.

Discussion and implications

The incompleteness results affect the philosophy of mathematics, particularly viewpoints like formalism, which uses formal logic to define its principles. One can paraphrase the first theorem as saying, "we can never find an all-encompassing axiomatic system which is able to prove all mathematical truths, but no falsehoods."

On the other hand, from a strict formalist perspective this paraphrase would be considered meaningless because it presupposes that mathematical "truth" and "falsehood" are well-defined in an absolute sense, rather than relative to each formal system.

The following rephrasing of the second theorem is even more unsettling to the foundations of mathematics:

If an axiomatic system can be proven to be consistent and complete from within itself, then it is inconsistent.

Therefore, in order to establish the consistency of a system S, one needs to use some other more powerful system T, but a proof in T is not completely convincing unless T's consistency has already been established without using S.

The consistency of the Peano axioms for natural numbers for example can be proven in set theory, but not in the theory of natural numbers alone. This provides a negative answer to Hilbert's second problem.

In principle, Gödel's theorems still leave some hope: it might be possible to produce a general algorithm that for a given statement determines whether it is undecidable or not, thus allowing mathematicians to bypass the undecidable statements altogether. However, the negative answer to the Entscheidungsproblem, obtained in 1936, showed that no such algorithm exists.

There are some who hold that a statement that is unprovable within a deductive system may be quite provable in a metalanguage. And what cannot be proven in that metalanguage can likely be proven in a meta-metalanguage, recursively, ad infinitum, in principle. By invoking a such a system of typed metalanguages, along with an axiom of Reducibility — which by an inductive assumption applies to the entire stack of languages — one may, for all practical purposes, overcome the obstacle of incompleteness.

Note that Gödel's theorems only apply to sufficiently strong axiomatic systems. "Sufficiently strong" means that the theory contains enough arithmetic to carry out the coding constructions needed for the proof of the first incompleteness theorem. Essentially, all that is required are some basic facts about addition and multiplication as formalized, e.g., in Robinson arithmetic Q. There are even weaker axiomatic systems that are consistent and complete, for instance Presburger arithmetic which proves every true first-order statement involving only addition.

The axiomatic system may consist of infinitely many axioms (as first-order Peano arithmetic does), but for Gödel's theorem to apply, there has to be an effective algorithm which is able to check proofs for correctness. For instance, one might take the set of all first-order sentences which are true in the standard model of the natural numbers. This system is complete; Gödel's theorem does not apply because there is no effective procedure that decides if a given sentence is an axiom. In fact, that this is so is a consequence of Gödel's first incompleteness theorem.

Another example of a specification of a theory to which Gödel's first theorem does not apply can be constructed as follows: order all possible statements about natural numbers first by length and then lexicographically, start with an axiomatic system initially equal to the Peano axioms, go through your list of statements one by one, and, if the current statement cannot be proven nor disproven from the current axiom system, add it to that system. This creates a system which is complete, consistent, and sufficiently powerful, but not computably enumerable.

Gödel himself only proved a technically slightly weaker version of the above theorems; the first proof for the versions stated above was given by J. Barkley Rosser in 1936.

In essence, the proof of the first theorem consists of constructing a statement p within a formal axiomatic system that can be given a meta-mathematical interpretation of:

p = "This statement cannot be proven in the given formal theory"

As such, it can be seen as a modern variant of the Liar paradox, although unlike the classical paradoxes it's not really paradoxical.

If the axiomatic system is (ω-)consistent, Gödel's proof shows that p (and its negation) cannot be proven in the system. Therefore p is true (p claims to be not provable, and it is not provable) yet it cannot be formally proved in the system. Adding p to the axioms of the system would not solve the problem: there would be another Gödel sentence for the enlarged theory. Theories such as Peano arithmetic, for which any computably enumerable consistent extension is incomplete, are called essentially incomplete.

Minds and machines

Main article: Mechanism (philosophy)#Gödelian arguments Some scholars have debated over what, if anything, Gödel's incompleteness theorems imply about human intelligence. Much of the debate centers on whether the human mind is equivalent to a Turing machine, or by the Church-Turing thesis, any finite machine at all. If it is, and if the machine is consistent, then Gödel's incompleteness theorems would apply to it.

Proof sketch for the first theorem

The main problem in fleshing out the above mentioned proof idea is the following: in order to construct a statement p that is equivalent to "p cannot be proved", p would have to somehow contain a reference to p, which could easily give rise to an infinite regress. Gödel's ingenious trick, which was later used by Alan Turing to show that the Entscheidungsproblem is unsolvable, will be described below.

To begin with, every formula or statement that can be formulated in our system gets a unique number, called its Gödel number. This is done in such a way that it is easy to mechanically convert back and forth between formulas and Gödel numbers. Because our system is strong enough to reason about numbers, it is now also possible to reason about formulas.

A formula F(x) that contains exactly one free variable x is called a statement form. As soon as x is replaced by a specific number, the statement form turns into a bona fide statement, and it is then either provable in the system, or not. Statement forms themselves are not statements and therefore cannot be proved or disproved. But every statement form F(x) has a Gödel number which we will denote by G(F). The choice of the free variable used in the form F(x) is not relevant to the assignment of the Gödel number G(F).

By carefully analyzing the axioms and rules of the system, one can then write down a statement form P(x) which embodies the idea that x is the Gödel number of a statement which can be proved in our system. Formally: P(x) can be proved if x is the Gödel number of a provable statement, and its negation ~P(x) can be proved if it isn't. (While this is good enough for this proof sketch, it is technically not completely accurate. See Gödel's paper for the problem and Rosser's paper for the resolution. The key word is "omega-consistency".)

Now comes the trick: a statement form F is called self-unprovable if F(G(F)) (the form F applied to its own Gödel number) is not provable. This concept can be defined formally, and we can construct a statement form SU(z) whose interpretation is that z is the Gödel number of a self-unprovable statement form. Formally, SU(z) is defined as: z = G(F) for some particular form F(x), and y is the Gödel number of the statement F(G(F)), and ~P(y). Now the desired statement p that was mentioned above can be defined as:

p = SU(G(SU)).

Intuitively, when asking whether p is true, we ask: "Is the property of being self-unprovable itself self-unprovable?" This is very reminiscent of the Barber paradox about the barber who shaves precisely those people who don't shave themselves: does he shave himself?

We will now assume that our axiomatic system is consistent.

If p were provable, then SU(G(SU)) would be true, and by definition of SU, z = G(SU) would be the Gödel number of a self-unprovable statement form. Hence SU would be self-unprovable, which by definition of self-unprovable means that SU(G(SU)) is not provable, but this was our p: p is not provable. This contradiction shows that p cannot be provable.

If the negation of p= SU(G(SU)) were provable, then by definition of SU this would mean that z = G(SU) is not the Gödel number of a self-unprovable form, which implies that SU is not self-unprovable. By definition of self-unprovable, we conclude that SU(G(SU)) is provable, hence p is provable. Again a contradiction. This one shows that the negation of p cannot be provable either.

So the statement p can neither be proved nor disproved within our system.

Proof sketch for the second theorem

Let p stand for the undecidable sentence constructed above, and let's assume that the consistency of the system can be proven from within the system itself. We have seen above that if the system is consistent, then p is not provable. The proof of this implication can be formalized in the system itself, and therefore the statement "p is not provable", or "not P(p)" can be proven in the system.

But this last statement is equivalent to p itself (and this equivalence can be proven in the system), so p can be proven in the system. This contradiction shows that the system must be inconsistent.

Related

• Theories: Gödel, Escher, Bach: an Eternal Golden Braid Consistency proof, Diagonal lemma, Self-reference, Self-verifying theories, Logicism, Minds, Machines and Gödel, Goodstein's theorem
• Principia Mathematica
• theory of everything

Footnotes

• The word "true" here is being used disquotationally; that is, the statement "G_T is true" means the same thing as G_T itself. Thus a formalist might reinterpret the claim

for every theory T satisfying the hypotheses, if T is consistent, then G_T is true

to mean

for every theory T satisfying the hypotheses, it is a theorem of Peano Arithmetic that Con(T)→G_T

where Con(T) is the natural formalization of the claim "T is consistent", and G_T is the Gödel sentence for T.

References and external articles

• Kurt Gödel, 1931, Ãœber formal unentscheidbare Sätze der Principia Mathematica und verwandter Systeme, I. Monatshefte für Mathematik und Physik 38: 173-98. Translated in Jean van Heijenoort, 1967. From Frege to Gödel: A Source Book on Mathematical Logic. Harvard University Press: 596-616.
• ------, On formally undecidable propositions of Principia Mathematica and related systems I. Translated by Martin Hirzel, November 27, 2000.
• ------, 1951, Some basic theorems on the foundations of mathematics and their implications in Solomon Feferman, ed., 1995. Collected works / Kurt Gödel, Vol. III. Oxford University Press: 304-23.
• John Barkley Rosser, 1936, "Extensions of some theorems of Gödel and Church," Journal of Symbolic Logic 1: 87-91.
• Jean Van Heijenoort, 1963. "Gödel's Theorem," in Paul Edwards, ed., Encyclopedia of Philosophy, Vol. 3. Macmillan: 348-57.
• Stanley Jaki OSB, 2005. The drama of the quantities. Real View Books.
• Hao Wang, 1997. A Logical Journey: From Gödel to Philosophy. MIT Press. ISBN 0262231891
• Podnieks, KÄ?rlis, Around Goedel's Theorem.
• Douglas Hofstadter, 1979. Gödel, Escher, Bach: An Eternal Golden Braid. Vintage Books. ISBN 0465026850. (1999 reprint: ISBN 0465026567).
• Ernest Nagel, James Roy Newman, Douglas R. Hofstadter, 2002 (1958). Gödel's Proof, revised ed. ISBN 0814758169.
• Hilbert's second problem (English translation)
• Domeisen, Norbert, 1990. Logik der Antinomien. Bern: Peter Lang. 142 S. 1990. ISBN 3-261-04214-1. Zentralblatt MATH
• Franzén, Torkel, 2005. Gödel's Theorem: An Incomplete Guide to its Use and Abuse. A.K. Peters. ISBN 1568812388
• Rudy Rucker, 1995 (1982). Infinity and the Mind: The Science and Philosophy of the Infinite. Princeton Univ. Press.
• Hoffmann, Daniel Sander - Transplexity (2006). Lulu Press. ISBN 978-1-4116-6222-3
• Peter Smith, An Introduction to Gödel's Theorems. Forthcoming mid 2007, Cambridge University Press.
• Raymond Smullyan, 1991. Godel's Incompleteness Theorems. Oxford Univ. Press.
• Gödel's biography with photo
• Gentzen's biography with photo
• Godel's Theorem explained further
• Can the cosmos be modeled as a Turing machine? Private web site concludes that Godel's incompleteness theorem forbids this.
• A late awakening to Gödel in physics - Rev. Stanley Jaki
• An outline of the proof of Godel's Incompleteness Theorem includes all essential ideas - without the final technical details
• Gödel Incompleteness Theorems - A Brief Introduction A lucid and enjoyable exposition of both theorems in the spirit of Godel's original proof.
• Wikipedia contributors, Wikipedia: The Free Encyclopedia. Wikimedia Foundation. <http://en.wikipedia.org>.