Propositional calculus

The propositional calculus^[a] is a branch of logic.^[1] It is also called propositional logic,^[2] statement logic,^[1] sentential calculus,^[3] sentential logic,^[1] or sometimes zeroth-order logic.^[4]^[5] It deals with propositions^[1] (which can be true or false)^[6] and relations between propositions,^[7] including the construction of arguments based on them.^[8] Compound propositions are formed by connecting propositions by logical connectives representing the truth functions of conjunction, disjunction, implication, biconditional, and negation.^[9]^[10]^[11]^[12] Some sources include other connectives, as in the table below.

Unlike first-order logic, propositional logic does not deal with non-logical objects, predicates about them, or quantifiers. However, all the machinery of propositional logic is included in first-order logic and higher-order logics. In this sense, propositional logic is the foundation of first-order logic and higher-order logic.

Propositional logic is typically studied with a formal language, in which propositions are represented by letters, which are called propositional variables. These are then used, together with symbols for connectives, to make compound propositions. Because of this, the propositional variables are called atomic formulas of a formal zeroth-order language.^[10]^[2] While the atomic propositions are typically represented by letters of the alphabet,^[10] there is a variety of notations to represent the logical connectives. The following table shows the main notational variants for each of the connectives in propositional logic.

Notational variants of the connectives^[13]^[14]
Connective	Symbol
AND	$A\land B$ , $A\cdot B$ , $AB$ , $A\&B$ , $A\&\&B$
equivalent	$A\equiv B$ , $A\Leftrightarrow B$ , $A\leftrightharpoons B$
implies	$A\Rightarrow B$ , $A\supset B$ , $A\rightarrow B$
NAND	$A{\overline {\land }}B$ , $A\mid B$ , ${\overline {A\cdot B}}$
nonequivalent	$A\not \equiv B$ , $A\not \Leftrightarrow B$ , $A\nleftrightarrow B$
NOR	$A{\overline {\lor }}B$ , $A\downarrow B$ , ${\overline {A+B}}$
NOT	$\neg A$ , $-A$ , ${\overline {A}}$ , $\sim A$
OR	$A\lor B$ , $A+B$ , $A\mid B$ , $A\parallel B$
XNOR	$A$ XNOR $B$
XOR	$A{\underline {\lor }}B$ , $A\oplus B$

The most thoroughly researched branch of propositional logic is classical truth-functional propositional logic,^[1] in which formulas are interpreted as having precisely one of two possible truth values, the truth value of true or the truth value of false.^[15] The principle of bivalence and the law of excluded middle are upheld. By comparison with first-order logic, truth-functional propositional logic is considered to be zeroth-order logic.^[4]^[5]

History[edit]

Although propositional logic (also called propositional calculus) had been hinted by earlier philosophers, it was developed into a formal logic (Stoic logic) by Chrysippus in the 3rd century BC^[16] and expanded by his successor Stoics. The logic was focused on propositions. This was different from the traditional syllogistic logic, which focused on terms. However, most of the original writings were lost^[17] and, at some time between the 3rd and 6th century CE, Stoic logic faded into oblivion, to be resurrected only in the 20th century, in the wake of the (re)-discovery of propositional logic.^[18]

Symbolic logic, which would come to be important to refine propositional logic, was first developed by the 17th/18th-century mathematician Gottfried Leibniz, whose calculus ratiocinator was, however, unknown to the larger logical community. Consequently, many of the advances achieved by Leibniz were recreated by logicians like George Boole and Augustus De Morgan, completely independent of Leibniz.^[19]

Gottlob Frege's predicate logic builds upon propositional logic, and has been described as combining "the distinctive features of syllogistic logic and propositional logic."^[20] Consequently, predicate logic ushered in a new era in logic's history; however, advances in propositional logic were still made after Frege, including natural deduction, truth trees and truth tables. Natural deduction was invented by Gerhard Gentzen and Stanisław Jaśkowski. Truth trees were invented by Evert Willem Beth.^[21] The invention of truth tables, however, is of uncertain attribution.

Within works by Frege^[22] and Bertrand Russell,^[23] are ideas influential to the invention of truth tables. The actual tabular structure (being formatted as a table), itself, is generally credited to either Ludwig Wittgenstein or Emil Post (or both, independently).^[22] Besides Frege and Russell, others credited with having ideas preceding truth tables include Philo, Boole, Charles Sanders Peirce,^[24] and Ernst Schröder. Others credited with the tabular structure include Jan Łukasiewicz, Alfred North Whitehead, William Stanley Jevons, John Venn, and Clarence Irving Lewis.^[23] Ultimately, some have concluded, like John Shosky, that "It is far from clear that any one person should be given the title of 'inventor' of truth-tables.".^[23]

Sentences[edit]

Propositional logic, as currently studied in universities, is a specification of a standard of logical consequence in which only the meanings of propositional connectives are considered in evaluating the conditions for the truth of a sentence, or whether a sentence logically follows from some other sentence or group of sentences.^[2]

Declarative sentences[edit]

Propositional logic deals with statements, which are defined as declarative sentences having truth value.^[25]^[1] Examples of statements might include:

Wikipedia is a free online encyclopedia that anyone can edit.
London is the capital of England.
All Wikipedia editors speak at least three languages.

Declarative sentences are contrasted with questions, such as "What is Wikipedia?", and imperative statements, such as "Please add citations to support the claims in this article.".^[26]^[27] Such non-declarative sentences have no truth value,^[28] and are only dealt with in nonclassical logics, called erotetic and imperative logics.

Compounding sentences with connectives[edit]

In propositional logic, a statement can contain one or more other statements as parts.^[1] Compound sentences are formed from simpler sentences and express relationships among the constituent sentences.^[29] This is done by combining them with logical connectives:^[29]^[30] the main types of compound sentences are negations, conjunctions, disjunctions, implications, and biconditionals,^[29] which are formed by using the corresponding connectives to connect propositions.^[31]^[32] In English, these connectives are expressed by the words "and" (conjunction), "or" (disjunction), "not" (negation), "if" (material conditional), and "if and only if" (biconditional).^[1]^[9] Examples of such compound sentences might include:

Wikipedia is a free online encyclopedia that anyone can edit, and millions already have. (conjunction)
It is not true that all Wikipedia editors speak at least three languages. (negation)
Either London is the capital of England, or London is the capital of the United Kingdom, or both. (disjunction)^[b]

If sentences lack any logical connectives, they are called simple sentences,^[1] or atomic sentences;^[30] if they contain one or more logical connectives, they are called compound sentences,^[29] or molecular sentences.^[30]

Sentential connectives are a broader category that includes logical connectives.^[2]^[30] Sentential connectives are any linguistic particles that bind sentences to create a new compound sentence,^[2]^[30] or that inflect a single sentence to create a new sentence.^[2] A logical connective, or propositional connective, is a kind of sentential connective with the characteristic feature that, when the original sentences it operates on are (or express) propositions, the new sentence that results from its application also is (or expresses) a proposition.^[2] Philosophers disagree about what exactly a proposition is,^[6]^[2] as well as about which sentential connectives in natural languages should be counted as logical connectives.^[30]^[2] Sentential connectives are also called sentence-functors,^[33] and logical connectives are also called truth-functors.^[33]

Arguments[edit]

An argument is defined as a pair of things, namely a set of sentences, called the premises,^[c] and a sentence, called the conclusion.^[34]^[30]^[33] The conclusion is claimed to follow from the premises,^[33] and the premises are claimed to support the conclusion.^[30]

Example argument[edit]

The following is an example of an argument within the scope of propositional logic:

Premise 1: If it's raining, then it's cloudy.

Premise 2: It's raining.

Conclusion: It's cloudy.

The logical form of this argument is known as modus ponens,^[35] which is a classically valid form.^[36] So, in classical logic, the argument is valid, although it may or may not be sound, depending on the meteorological facts in a given context. This example argument will be reused when explaining § Formalization.

Validity and soundness[edit]

An argument is valid if, and only if, it is necessary that, if all its premises are true, its conclusion is true.^[34]^[37]^[38] Alternatively, an argument is valid if, and only if, it is impossible for all the premises to be true while the conclusion is false.^[38]^[34]

Validity is contrasted with soundness.^[38] An argument is sound if, and only if, it is valid and all its premises are true.^[34]^[38] Otherwise, it is unsound.^[38]

Logic, in general, aims to precisely specify valid arguments.^[30] This is done by defining a valid argument as one in which its conclusion is a logical consequence of its premises,^[30] which, when this is understood as semantic consequence, means that there is no case in which the premises are true but the conclusion is not true^[30] – see § Semantics below.

Formalization[edit]

Propositional logic is typically studied through a formal system in which formulas of a formal language are interpreted to represent propositions. This formal language is the basis for proof systems, which allow a conclusion to be derived from premises if, and only if, it is a logical consequence of them. This section will show how this works by formalizing the § Example argument. The formal language for a propositional calculus will be fully specified in § Language, and an overview of proof systems will be given in § Proof systems.

Propositional variables[edit]

Since propositional logic is not concerned with the structure of propositions beyond the point where they cannot be decomposed any more by logical connectives,^[35]^[1] it is typically studied by replacing such atomic (indivisible) statements with letters of the alphabet, which are interpreted as variables representing statements (propositional variables).^[1] With propositional variables, the § Example argument would then be symbolized as follows:

Premise 1:

P\to Q

Premise 2:

P

Conclusion:

Q

When $P$ is interpreted as "It's raining" and $Q$ as "it's cloudy" these symbolic expressions correspond exactly with the original expression in natural language. Not only that, but they will also correspond with any other inference with the same logical form.

When a formal system is used to represent formal logic, only statement letters (usually capital roman letters such as $P$ , $Q$ and $R$ ) are represented directly. The natural language propositions that arise when they're interpreted are outside the scope of the system, and the relation between the formal system and its interpretation is likewise outside the formal system itself.

Gentzen notation[edit]

If we assume that the validity of modus ponens has been accepted as an axiom, then the same § Example argument can also be depicted like this:

{\frac {P\to Q,P}{Q}}

This method of displaying it is Gentzen's notation for natural deduction and sequent calculus.^[39] The premises are shown above a line, called the inference line,^[11] separated by a comma, which indicates combination of premises.^[40] The conclusion is written below the inference line.^[11] The inference line represents syntactic consequence,^[11] sometimes called deductive consequence,^[41] which is also symbolized with ⊢.^[42]^[41] So the above can also be written in one line as $P\to Q,P\vdash Q$ .^[d]

Syntactic consequence is contrasted with semantic consequence,^[43] which is symbolized with ⊧.^[42]^[41] In this case, the conclusion follows syntactically because the natural deduction inference rule of modus ponens has been assumed. For more on inference rules, see the sections on proof systems below.

Language[edit]

The language (commonly called ${\mathcal {L}}$ )^[44]^[45]^[30] of a propositional calculus is defined in terms of:^[2]^[10]

a set of primitive symbols, called atomic formulas, atomic sentences,^[35]^[30] atoms,^[46] placeholders, prime formulas,^[46] proposition letters, sentence letters,^[35] or variables, and
a set of operator symbols, called connectives,^[14]^[1]^[47] logical connectives,^[1] logical operators,^[1] truth-functional connectives,^[1] truth-functors,^[33] or propositional connectives.^[2]

A well-formed formula is any atomic formula, or any formula that can be built up from atomic formulas by means of operator symbols according to the rules of the grammar. The language ${\mathcal {L}}$ , then, is defined either as being identical to its set of well-formed formulas,^[45] or as containing that set (together with, for instance, its set of connectives and variables).^[10]^[30]

Usually the syntax of ${\mathcal {L}}$ is defined recursively by just a few definitions, as seen next; some authors explicitly include parentheses as punctuation marks when defining their language's syntax,^[30]^[48] while others use them without comment.^[2]^[10]

Syntax[edit]

Given a set of atomic propositional variables $p_{1}$ , $p_{2}$ , $p_{3}$ , ..., and a set of propositional connectives $c_{1}^{1}$ , $c_{2}^{1}$ , $c_{3}^{1}$ , ..., $c_{1}^{2}$ , $c_{2}^{2}$ , $c_{3}^{2}$ , ..., $c_{1}^{3}$ , $c_{2}^{3}$ , $c_{3}^{3}$ , ..., a formula of propositional logic is defined recursively by these definitions:^[2]^[10]^[47]^[e]

Definition 1: Atomic propositional variables are formulas.

Definition 2: If

c_{n}^{m}

is a propositional connective, and

\langle

A, B, C, …

\rangle

is a sequence of m, possibly but not necessarily atomic, possibly but not necessarily distinct, formulas, then the result of applying

c_{n}^{m}

to to

\langle

A, B, C, …

\rangle

is a formula.

Definition 3: Nothing else is a formula.

Writing the result of applying $c_{n}^{m}$ to $\langle$ A, B, C, … $\rangle$ in functional notation, as $c_{n}^{m}$ (A, B, C, …), we have the following as examples of well-formed formulas:

$p_{5}$
$c_{3}^{2}(p_{2},p_{9})$
$c_{3}^{2}(p_{1},c_{2}^{1}(p_{3}))$
$c_{1}^{3}(p_{4},p_{6},c_{2}^{2}(p_{1},p_{2}))$
$c_{4}^{2}(c_{1}^{1}(p_{7}),c_{3}^{1}(p_{8}))$
$c_{2}^{3}(c_{1}^{2}(p_{3},p_{4}),c_{2}^{1}(p_{5}),c_{3}^{2}(p_{6},p_{7}))$
$c_{3}^{1}(c_{1}^{3}(p_{2},p_{3},c_{2}^{2}(p_{4},p_{5})))$

What was given as Definition 2 above, which is responsible for the composition of formulas, is referred to by Colin Howson as the principle of composition.^[35]^[f] It is this recursion in the definition of a language's syntax which justifies the use of the word "atomic" to refer to propositional variables, since all formulas in the language ${\mathcal {L}}$ are built up from the atoms as ultimate building blocks.^[2] Composite formulas (all formulas besides atoms) are called molecules,^[46] or molecular sentences.^[30] (This is an imperfect analogy with chemistry, since a chemical molecule may sometimes have only one atom, as in monatomic gases.)^[46]

The definition that "nothing else is a formula", given above as Definition 3, excludes any formula from the language which is not specifically required by the other definitions in the syntax.^[33] In particular, it excludes infinitely long formulas from being well-formed.^[33]

CF grammar in BNF[edit]

An alternative to the syntax definitions given above is to write a context-free (CF) grammar for the language ${\mathcal {L}}$ in Backus-Naur form (BNF).^[50]^[51] This is more common in computer science than in philosophy.^[51] It can be done in many ways,^[50] of which a particularly brief one, for the common set of five connectives, is this single clause:^[51]^[52]

\phi ::=a_{1},a_{2},\ldots ~|~\neg \phi ~|~\phi ~\&~\psi ~|~\phi \vee \psi ~|~\phi \rightarrow \psi ~|~\phi \leftrightarrow \psi

This clause, due to its self-referential nature (since $\phi$ is in some branches of the definition of $\phi$ ), also acts as a recursive definition, and therefore specifies the entire language. To expand it to add modal operators, one need only add … $|~\Box \phi ~|~\Diamond \phi$ to the end of the clause.^[51]

Constants and schemata[edit]

Mathematicians sometimes distinguish between propositional constants, propositional variables, and schemata. Propositional constants represent some particular proposition,^[53] while propositional variables range over the set of all atomic propositions.^[53] Schemata, or schematic letters, however, range over all formulas.^[33]^[1] (Schematic letters are also called metavariables.)^[34] It is common to represent propositional constants by $A$ , $B$ , and $C$ , propositional variables by $P$ , $Q$ , and $R$ , and schematic letters are often Greek letters, most often $φ$ , $ψ$ , and $χ$ .^[33]^[1]

However, some authors recognize only two "propositional constants" in their formal system: the special symbol $\top$ , called "truth", which always evaluates to True, and the special symbol $\bot$ , called "falsity", which always evaluates to False.^[54]^[55]^[56] Other authors also include these symbols, with the same meaning, but consider them to be "zero-place truth-functors",^[33] or equivalently, "nullary connectives".^[47]

Semantics[edit]

To serve as a model of the logic of a given natural language, a formal language must be semantically interpreted.^[30] In classical logic, all propositions evaluate to exactly one of two truth-values: True or False.^[1]^[57] For example, "Wikipedia is a free online encyclopedia that anyone can edit" evaluates to True,^[58] while "Wikipedia is a paper encyclopedia" evaluates to False.^[59]

In other respects, the following formal semantics can apply to the language of any propositional logic, but the assumptions that there are only two semantic values (bivalence), that only one of the two is assigned to each formula in the language (noncontradiction), and that every formula gets assigned a value (excluded middle), are distinctive features of classical logic.^[57]^[60]^[33] To learn about nonclassical logics with more than two truth-values, and their unique semantics, one may consult the articles on "Many-valued logic", "Three-valued logic", "Finite-valued logic", and "Infinite-valued logic".

Interpretation (case) and argument[edit]

For a given language ${\mathcal {L}}$ , an interpretation,^[61] valuation,^[48] or case,^[30]^[g] is an assignment of semantic values to each formula of ${\mathcal {L}}$ .^[30] For a formal language of classical logic, a case is defined as an assignment, to each formula of ${\mathcal {L}}$ , of one or the other, but not both, of the truth values, namely truth (T, or 1) and falsity (F, or 0).^[62]^[63] An interpretation that follows the rules of classical logic is sometimes called a Boolean valuation.^[48]^[64] An interpretation of a formal language for classical logic is often expressed in terms of truth tables.^[65]^[1] Since each formula is only assigned a single truth-value, an interpretation may be viewed as a function, whose domain is ${\mathcal {L}}$ , and whose range is its set of semantic values ${\mathcal {V}}=\{{\mathsf {T}},{\mathsf {F}}\}$ ,^[2] or ${\mathcal {V}}=\{1,0\}$ .^[30]

For $n$ distinct propositional symbols there are $2^{n}$ distinct possible interpretations. For any particular symbol $a$ , for example, there are $2^{1}=2$ possible interpretations: either $a$ is assigned T, or $a$ is assigned F. And for the pair $a$ , $b$ there are $2^{2}=4$ possible interpretations: either both are assigned T, or both are assigned F, or $a$ is assigned T and $b$ is assigned F, or $a$ is assigned F and $b$ is assigned T.^[65] Since ${\mathcal {L}}$ has $\aleph _{0}$ , that is, denumerably many propositional symbols, there are $2^{\aleph _{0}}={\mathfrak {c}}$ , and therefore uncountably many distinct possible interpretations of ${\mathcal {L}}$ as a whole.^[65]

Where ${\mathcal {I}}$ is an interpretation and $\varphi$ and $\psi$ represent formulas, the definition of an argument, given in § Arguments, may then be stated as a pair $\langle \{\varphi _{1},\varphi _{2},\varphi _{3},...,\varphi _{n}\},\psi \rangle$ , where $\{\varphi _{1},\varphi _{2},\varphi _{3},...,\varphi _{n}\}$ is the set of premises and $\psi$ is the conclusion. The definition of an argument's validity, i.e. its property that $\{\varphi _{1},\varphi _{2},\varphi _{3},...,\varphi _{n}\}\models \psi$ , can then be stated as its absence of a counterexample, where a counterexample is defined as a case ${\mathcal {I}}$ in which the argument's premises $\{\varphi _{1},\varphi _{2},\varphi _{3},...,\varphi _{n}\}$ are all true but the conclusion $\psi$ is not true.^[30]^[35] As will be seen in § Semantic truth, validity, consequence, this is the same as to say that the conclusion is a semantic consequence of the premises.

Propositional connective semantics[edit]

An interpretation assigns semantic values to atomic formulas directly.^[61]^[30] Molecular formulas are assigned a function of the value of their constituent atoms, according to the connective used;^[61]^[30] the connectives are defined in such a way that the truth-value of a sentence formed from atoms with connectives depends on the truth-values of the atoms that they're applied to, and only on those.^[61]^[30] This assumption is referred to by Colin Howson as the assumption of the truth-functionality of the connectives.^[35]

Semantics via truth tables[edit]

Since logical connectives are defined semantically only in terms of the truth values that they take when the propositional variables that they're applied to take either of the two possible truth values,^[1]^[30] the semantic definition of the connectives is usually represented as a truth table for each of the connectives,^[1]^[30]^[66] as seen below:

p	q	p ∧ q	p ∨ q	p → q	p ↔ q	¬p	¬q
T	T	T	T	T	T	F	F
T	F	F	T	F	F	F	T
F	T	F	T	T	F	T	F
F	F	F	F	T	T	T	T

This table covers each of the main five logical connectives:^[9]^[10]^[11]^[12] conjunction (here notated p ∧ q), disjunction (p ∨ q), implication (p → q), biconditional (p ↔ q) and negation, (¬p, or ¬q, as the case may be). It is sufficient for determining the semantics of each of these operators.^[1]^[67]^[30] For more truth tables for more different kinds of connectives, see the article "Truth table".

Semantics via assignment expressions[edit]

Some authors (viz., all the authors cited in this subsection) write out the connective semantics using a list of statements instead of a table. In this format, where ${\mathcal {I}}(\varphi )$ is the interpretation of $\varphi$ , the five connectives are defined as:^[33]^[48]

${\mathcal {I}}(\neg P)={\mathsf {T}}$ if, and only if, ${\mathcal {I}}(P)={\mathsf {F}}$
${\mathcal {I}}(P\land Q)={\mathsf {T}}$ if, and only if, ${\mathcal {I}}(P)={\mathsf {T}}$ and ${\mathcal {I}}(Q)={\mathsf {T}}$
${\mathcal {I}}(P\lor Q)={\mathsf {T}}$ if, and only if, ${\mathcal {I}}(P)={\mathsf {T}}$ or ${\mathcal {I}}(Q)={\mathsf {T}}$
${\mathcal {I}}(P\to Q)={\mathsf {T}}$ if, and only if, it is true that, if ${\mathcal {I}}(P)={\mathsf {T}}$ , then ${\mathcal {I}}(Q)={\mathsf {T}}$
${\mathcal {I}}(P\leftrightarrow Q)={\mathsf {T}}$ if, and only if, it is true that ${\mathcal {I}}(P)={\mathsf {T}}$ if, and only if, ${\mathcal {I}}(Q)={\mathsf {T}}$

Instead of ${\mathcal {I}}(\varphi )$ , the interpretation of $\varphi$ may be written out as $|\varphi |$ ,^[33]^[68] or, for definitions such as the above, ${\mathcal {I}}(\varphi )={\mathsf {T}}$ may be written simply as the English sentence " $\varphi$ is given the value ${\mathsf {T}}$ ".^[48] Yet other authors^[69]^[70] may prefer to speak of a Tarskian model ${\mathfrak {M}}$ for the language, so that instead they'll use the notation ${\mathfrak {M}}\models \varphi$ , which is equivalent to saying ${\mathcal {I}}(\varphi )={\mathsf {T}}$ , where ${\mathcal {I}}$ is the interpretation function for ${\mathfrak {M}}$ .^[70]

Connective definition methods[edit]

Some of these connectives may be defined in terms of others: for instance, implication, p → q, may be defined in terms of disjunction and negation, as ¬p ∨ q;^[71] and disjunction may be defined in terms of negation and conjunction, as ¬(¬p ∧ ¬q).^[48] In fact, a truth-functionally complete system,^[h] in the sense that all and only the classical propositional tautologies are theorems, may be derived using only disjunction and negation (as Russell, Whitehead, and Hilbert did),^[2] or using only implication and negation (as Frege did),^[2] or using only conjunction and negation,^[2] or even using only a single connective for "not and" (the Sheffer stroke),^[3]^[2] as Jean Nicod did.^[2] A joint denial connective (logical NOR) will also suffice, by itself, to define all other connectives,^[48] but no other connectives have this property.^[48]

Some authors, namely Howson^[35] and Cunningham,^[73] distinguish equivalence from the biconditional. (As to equivalence, Howson calls it "truth-functional equivalence", while Cunningham calls it "logical equivalence".) Equivalence is symbolized with ⇔ and is a metalanguage symbol, while a biconditional is symbolized with ↔ and is a logical connective in the object language ${\mathcal {L}}$ . Regardless, an equivalence or biconditional is true if, and only if, the formulas connected by it are assigned the same semantic value under every interpretation. Other authors often do not make this distinction, and may use the word "equivalence",^[11] and/or the symbol ⇔,^[74] to denote their object language's biconditional connective.

Semantic truth, validity, consequence[edit]

Given $\varphi$ and $\psi$ as formulas (or sentences) of a language ${\mathcal {L}}$ , and ${\mathcal {I}}$ as an interpretation (or case)^[i] of ${\mathcal {L}}$ , then the following definitions apply:^[65]^[63]

Truth-in-a-case:^[30] A sentence $\varphi$ of ${\mathcal {L}}$ is true under an interpretation ${\mathcal {I}}$ if ${\mathcal {I}}$ assigns the truth value T to $\varphi$ .^[63]^[65] If $\varphi$ is true under ${\mathcal {I}}$ , then ${\mathcal {I}}$ is called a model of $\varphi$ .^[65]
Falsity-in-a-case:^[30] $\varphi$ is false under an interpretation ${\mathcal {I}}$ if, and only if, $\neg \varphi$ is true under ${\mathcal {I}}$ .^[65]^[75]^[30] This is the "truth of negation" definition of falsity-in-a-case.^[30] Falsity-in-a-case may also be defined by the "complement" definition: $\varphi$ is false under an interpretation ${\mathcal {I}}$ if, and only if, $\varphi$ is not true under ${\mathcal {I}}$ .^[63]^[65] In classical logic, these definitions are equivalent, but in nonclassical logics, they are not.^[30]
Semantic consequence: A sentence $\psi$ of ${\mathcal {L}}$ is a semantic consequence ( $\varphi \models \psi$ ) of a sentence $\varphi$ if there is no interpretation under which $\varphi$ is true and $\psi$ is not true.^[63]^[65]^[30]
Valid formula (tautology): A sentence $\varphi$ of ${\mathcal {L}}$ is logically valid ( $\models \varphi$ ),^[j] or a tautology,^[76]^[77]^[48] if it is true under every interpretation,^[63]^[65] or true in every case.^[30]
Consistent sentence: A sentence of ${\mathcal {L}}$ is consistent if it is true under at least one interpretation. It is inconsistent if it is not consistent.^[63]^[65] An inconsistent formula is also called self-contradictory,^[1] and said to be a self-contradiction,^[1] or simply a contradiction,^[78]^[79]^[80] although this latter name is sometimes reserved specifically for statements of the form $(p\land \neg p)$ .^[1]

For interpretations (cases) ${\mathcal {I}}$ of ${\mathcal {L}}$ , these definitions are sometimes given:

Complete case: A case ${\mathcal {I}}$ is complete if, and only if, either $\varphi$ is true-in- ${\mathcal {I}}$ or $\neg \varphi$ is true-in- ${\mathcal {I}}$ , for any $\varphi$ in ${\mathcal {L}}$ .^[30]^[81]
Consistent case: A case ${\mathcal {I}}$ is consistent if, and only if, there is no $\varphi$ in ${\mathcal {L}}$ such that both $\varphi$ and $\neg \varphi$ are true-in- ${\mathcal {I}}$ .^[30]^[82]

For classical logic, which assumes that all cases are complete and consistent,^[30] the following theorems apply:

For any given interpretation, a given formula is either true or false under it.^[65]^[75]
No formula is both true and false under the same interpretation.^[65]^[75]
$\varphi$ is true under ${\mathcal {I}}$ if, and only if, $\neg \varphi$ is false under ${\mathcal {I}}$ ;^[65]^[75] $\neg \varphi$ is true under ${\mathcal {I}}$ if, and only if, $\varphi$ is not true under ${\mathcal {I}}$ .^[65]
If $\varphi$ and $(\varphi \to \psi )$ are both true under ${\mathcal {I}}$ , then $\psi$ is true under ${\mathcal {I}}$ .^[65]^[75]
If $\models \varphi$ and $\models (\varphi \to \psi )$ , then $\models \psi$ .^[65]
$(\varphi \to \psi )$ is true under ${\mathcal {I}}$ if, and only if, either $\varphi$ is not true under ${\mathcal {I}}$ , or $\psi$ is true under ${\mathcal {I}}$ .^[65]
$\varphi \models \psi$ if, and only if, $(\varphi \to \psi )$ is logically valid, that is, $\varphi \models \psi$ if, and only if, $\models (\varphi \to \psi )$ .^[65]^[75]

Proof systems[edit]

Proof systems in propositional logic can be broadly classified into semantic proof systems and syntactic proof systems,^[83]^[84]^[85] according to the kind of logical consequence that they rely on: semantic proof systems rely on semantic consequence ( $\varphi \models \psi$ ),^[86] whereas syntactic proof systems rely on syntactic consequence ( $\varphi \vdash \psi$ ).^[87] Semantic consequence deals with the truth values of propositions in all possible interpretations, whereas syntactic consequence concerns the derivation of conclusions from premises based on rules and axioms within a formal system.^[88] This section gives a very brief overview of the kinds of proof systems, with anchors to the relevant sections of this article on each one, as well as to the separate Wikipedia articles on each one.

Semantic proof systems[edit]

Semantic proof systems rely on the concept of semantic consequence, symbolized as $\varphi \models \psi$ , which indicates that if $\varphi$ is true, then $\psi$ must also be true in every possible interpretation.^[88]

Truth tables[edit]

A truth table is a semantic proof method used to determine the truth value of a propositional logic expression in every possible scenario.^[89] By exhaustively listing the truth values of its constituent atoms, a truth table can show whether a proposition is true, false, tautological, or contradictory.^[90] See § Semantic proof via truth tables.

Semantic tableaux[edit]

A semantic tableau is another semantic proof technique that systematically explores the truth of a proposition.^[91] It constructs a tree where each branch represents a possible interpretation of the propositions involved.^[92] If every branch leads to a contradiction, the original proposition is considered to be a contradiction, and its negation is considered a tautology.^[35] See § Semantic proof via tableaux.

Syntactic proof systems[edit]

Syntactic proof systems, in contrast, focus on the formal manipulation of symbols according to specific rules. The notion of syntactic consequence, $\varphi \vdash \psi$ , signifies that $\psi$ can be derived from $\varphi$ using the rules of the formal system.^[88]

Axiomatic systems[edit]

An axiomatic system is a set of axioms or assumptions from which other statements (theorems) are logically derived.^[93] In propositional logic, axiomatic systems define a base set of propositions considered to be self-evidently true, and theorems are proved by applying deduction rules to these axioms.^[94] See the § Jan Łukasiewicz axiomatic proof system example.

Natural deduction[edit]

Natural deduction is a syntactic method of proof that emphasizes the derivation of conclusions from premises through the use of intuitive rules reflecting ordinary reasoning.^[95] Each rule reflects a particular logical connective and shows how it can be introduced or eliminated.^[95] See § Syntactic proof via natural deduction.

Sequent calculus[edit]

The sequent calculus is a formal system that represents logical deductions as sequences or "sequents" of formulas.^[96] Developed by Gerhard Gentzen, this approach focuses on the structural properties of logical deductions and provides a powerful framework for proving statements within propositional logic.^[96]^[97]

Semantic proof via truth tables[edit]

Taking advantage of the semantic concept of validity (truth in every interpretation), it is possible to prove a formula's validity by using a truth table, which gives every possible interpretation (assignment of truth values to variables) of a formula.^[90]^[46]^[33] If, and only if, all the lines of a truth table come out true, the formula is semantically valid (true in every interpretation).^[90]^[46] Further, if (and only if) $\neg \varphi$ is valid, then $\varphi$ is inconsistent.^[78]^[79]^[80]

For instance, this table shows that "p → (q ∨ r → (r → ¬p))" is not valid:^[46]

p	q	r	q ∨ r	r → ¬p	q ∨ r → (r → ¬p)	p → (q ∨ r → (r → ¬p))
T	T	T	T	F	F	F
T	T	F	T	T	T	T
T	F	T	T	F	F	F
T	F	F	F	T	T	T
F	T	T	T	T	T	T
F	T	F	T	T	T	T
F	F	T	T	T	T	T
F	F	F	F	T	T	T

The computation of the last column of the third line may be displayed as follows:^[46]

p	→	(q	∨	r	→	(r	→	¬	p))
T	→	(F	∨	T	→	(T	→	¬	T))
T	→	(	T		→	(T	→	F	))
T	→	(	T		→		F		)
T	→				F
	F
T	F	F	T	T	F	T	F	F	T

Further, using the theorem that $\varphi \models \psi$ if, and only if, $(\varphi \to \psi )$ is valid,^[65]^[75] we can use a truth table to prove that a formula is a semantic consequence of a set of formulas: $\{\varphi _{1},\varphi _{2},\varphi _{3},...,\varphi _{n}\}\models \psi$ if, and only if, we can produce a truth table that comes out all true for the formula $\left(\left(\bigwedge _{i=1}^{n}\varphi _{i}\right)\rightarrow \psi \right)$ (that is, if $\models \left(\left(\bigwedge _{i=1}^{n}\varphi _{i}\right)\rightarrow \psi \right)$ ).^[98]^[99]

Semantic proof via tableaux[edit]

Since truth tables have 2ⁿ lines for n variables, they can be tiresomely long for large values of n.^[35] Analytic tableaux are a more efficient, but nevertheless mechanical,^[66] semantic proof method; they take advantage of the fact that "we learn nothing about the validity of the inference from examining the truth-value distributions which make either the premises false or the conclusion true: the only relevant distributions when considering deductive validity are clearly just those which make the premises true or the conclusion false."^[35]

Analytic tableaux for propositional logic are fully specified by the rules that are stated in schematic form below.^[48] These rules use "signed formulas", where a signed formula is an expression $TX$ or $FX$ , where $X$ is a (unsigned) formula of the language ${\mathcal {L}}$ .^[48] (Informally, $TX$ is read " $X$ is true", and $FX$ is read " $X$ is false".)^[48] Their formal semantic definition is that "under any interpretation, a signed formula $TX$ is called true if $X$ is true, and false if $X$ is false, whereas a signed formula $FX$ is called false if $X$ is true, and true if $X$ is false."^[48]

${\begin{aligned}&1)\quad {\frac {T\sim X}{FX}}\quad &&{\frac {F\sim X}{TX}}\\{\phantom {spacer}}\\&2)\quad {\frac {T(X\land Y)}{\begin{matrix}TX\\TY\end{matrix}}}\quad &&{\frac {F(X\land Y)}{FX|FY}}\\{\phantom {spacer}}\\&3)\quad {\frac {T(X\lor Y)}{TX|TY}}\quad &&{\frac {F(X\lor Y)}{\begin{matrix}FX\\FY\end{matrix}}}\\{\phantom {spacer}}\\&4)\quad {\frac {T(X\supset Y)}{FX|TY}}\quad &&{\frac {F(X\supset Y)}{\begin{matrix}TX\\FY\end{matrix}}}\end{aligned}}$

In this notation, rule 2 means that $T(X\land Y)$ yields both $TX,TY$ , whereas $F(X\land Y)$ branches into $FX,FY$ . The notation is to be understood analogously for rules 3 and 4.^[48] Often, in tableaux for classical logic, the signed formula notation is simplified so that $T\varphi$ is written simply as $\varphi$ , and $F\varphi$ as $\neg \varphi$ , which accounts for naming rule 1 the "Rule of Double Negation".^[35]^[66]

One constructs a tableau for a set of formulas by applying the rules to produce more lines and tree branches until every line has been used, producing a complete tableau. In some cases, a branch can come to contain both $TX$ and $FX$ for some $X$ , which is to say, a contradiction. In that case, the branch is said to close.^[35] If every branch in a tree closes, the tree itself is said to close.^[35] In virtue of the rules for construction of tableaux, a closed tree is a proof that the original formula, or set of formulas, used to construct it was itself self-contradictory, and therefore false.^[35] Conversely, a tableau can also prove that a logical formula is tautologous: if a formula is tautologous, its negation is a contradiction, so a tableau built from its negation will close.^[35]

To construct a tableau for an argument $\langle \{\varphi _{1},\varphi _{2},\varphi _{3},...,\varphi _{n}\},\psi \rangle$ , one first writes out the set of premise formulas, $\{\varphi _{1},\varphi _{2},\varphi _{3},...,\varphi _{n}\}$ , with one formula on each line, signed with $T$ (that is, $T\varphi$ for each $T\varphi$ in the set);^[66] and together with those formulas (the order is unimportant), one also writes out the conclusion, $\psi$ , signed with $F$ (that is, $F\psi$ ).^[66] One then produces a truth tree (analytic tableau) by using all those lines according to the rules.^[66] A closed tree will be proof that the argument was valid, in virtue of the fact that $\varphi \models \psi$ if, and only if, $\{\varphi ,\sim \psi \}$ is inconsistent (also written as $\varphi ,\sim \psi \models$ ).^[66]

List of classically valid argument forms[edit]

Using semantic checking methods, such as truth tables or semantic tableaux, to check for tautologies and semantic consequences, it can be shown that, in classical logic, the following classical argument forms are semantically valid, i.e., these tautologies and semantic consequences hold.^[33] We use $\varphi$ ⟚ $\psi$ to denote equivalence of $\varphi$ and $\psi$ , that is, as an abbreviation for both $\varphi \models \psi$ and $\psi \models \varphi$ ;^[33] as an aid to reading the symbols, a description of each formula is given. The description reads the symbol ⊧ (called the "double turnstile") as "therefore", which is a common reading of it,^[33]^[100] although many authors prefer to read it as "entails",^[33]^[101] or as "models".^[102]

Name	Sequent	Description
Modus Ponens	$((p\to q)\land p)\models q$ ^[30]	If $p$ then $q$ ; $p$ ; therefore $q$
Modus Tollens	$((p\to q)\land \neg q)\models \neg p$ ^[30]	If $p$ then $q$ ; not $q$ ; therefore not $p$
Hypothetical Syllogism	$((p\to q)\land (q\to r))\models (p\to r)$ ^[34]	If $p$ then $q$ ; if $q$ then $r$ ; therefore, if $p$ then $r$
Disjunctive Syllogism	$((p\lor q)\land \neg p)\models q$ ^[103]	Either $p$ or $q$ , or both; not $p$ ; therefore, $q$
Constructive Dilemma	$((p\to q)\land (r\to s)\land (p\lor r))\models (q\lor s)$ ^[34]	If $p$ then $q$ ; and if $r$ then $s$ ; but $p$ or $r$ ; therefore $q$ or $s$
Destructive Dilemma	$((p\to q)\land (r\to s)\land (\neg q\lor \neg s))\models (\neg p\lor \neg r)$	If $p$ then $q$ ; and if $r$ then $s$ ; but not $q$ or not $s$ ; therefore not $p$ or not $r$
Bidirectional Dilemma	$((p\to q)\land (r\to s)\land (p\lor \neg s))\models (q\lor \neg r)$	If $p$ then $q$ ; and if $r$ then $s$ ; but $p$ or not $s$ ; therefore $q$ or not $r$
Simplification	$(p\land q)\models p$ ^[30]	$p$ and $q$ are true; therefore $p$ is true
Conjunction	$p,q\models (p\land q)$ ^[30]	$p$ and $q$ are true separately; therefore they are true conjointly
Addition	$p\models (p\lor q)$ ^[30]^[103]	$p$ is true; therefore the disjunction ( $p$ or $q$ ) is true
Composition	$((p\to q)\land (p\to r))\models (p\to (q\land r))$	If $p$ then $q$ ; and if $p$ then $r$ ; therefore if $p$ is true then $q$ and $r$ are true
De Morgan's Theorem (1)	$\neg (p\land q)$ ⟚ $(\neg p\lor \neg q)$ ^[30]	The negation of ( $p$ and $q$ ) is equiv. to (not $p$ or not $q$ )
De Morgan's Theorem (2)	$\neg (p\lor q)$ ⟚ $(\neg p\land \neg q)$ ^[30]	The negation of ( $p$ or $q$ ) is equiv. to (not $p$ and not $q$ )
Commutation (1)	$(p\lor q)$ ⟚ $(q\lor p)$ ^[103]	( $p$ or $q$ ) is equiv. to ( $q$ or $p$ )
Commutation (2)	$(p\land q)$ ⟚ $(q\land p)$ ^[103]	( $p$ and $q$ ) is equiv. to ( $q$ and $p$ )
Commutation (3)	$(p\leftrightarrow q)$ ⟚ $(q\leftrightarrow p)$ ^[103]	( $p$ iff $q$ ) is equiv. to ( $q$ iff $p$ )
Association (1)	$(p\lor (q\lor r))$ ⟚ $((p\lor q)\lor r)$ ^[35]	$p$ or ( $q$ or $r$ ) is equiv. to ( $p$ or $q$ ) or $r$
Association (2)	$(p\land (q\land r))$ ⟚ $((p\land q)\land r)$ ^[35]	$p$ and ( $q$ and $r$ ) is equiv. to ( $p$ and $q$ ) and $r$
Distribution (1)	$(p\land (q\lor r))$ ⟚ $((p\land q)\lor (p\land r))$ ^[103]	$p$ and ( $q$ or $r$ ) is equiv. to ( $p$ and $q$ ) or ( $p$ and $r$ )
Distribution (2)	$(p\lor (q\land r))$ ⟚ $((p\lor q)\land (p\lor r))$ ^[103]	$p$ or ( $q$ and $r$ ) is equiv. to ( $p$ or $q$ ) and ( $p$ or $r$ )
Double Negation	$p$ ⟚ $\neg \neg p$ ^[30]^[103]	$p$ is equivalent to the negation of not $p$
Transposition	$(p\to q)$ ⟚ $(\neg q\to \neg p)$ ^[30]	If $p$ then $q$ is equiv. to if not $q$ then not $p$
Material Implication	$(p\to q)$ ⟚ $(\neg p\lor q)$ ^[103]	If $p$ then $q$ is equiv. to not $p$ or $q$
Material Equivalence (1)	$(p\leftrightarrow q)$ ⟚ $((p\to q)\land (q\to p))$ ^[103]	( $p$ iff $q$ ) is equiv. to (if $p$ is true then $q$ is true) and (if $q$ is true then $p$ is true)
Material Equivalence (2)	$(p\leftrightarrow q)$ ⟚ $((p\land q)\lor (\neg p\land \neg q))$ ^[103]	( $p$ iff $q$ ) is equiv. to either ( $p$ and $q$ are true) or (both $p$ and $q$ are false)
Material Equivalence (3)	$(p\leftrightarrow q)$ ⟚ $((p\lor \neg q)\land (\neg p\lor q))$	( $p$ iff $q$ ) is equiv to., both ( $p$ or not $q$ is true) and (not $p$ or $q$ is true)
Exportation	$((p\land q)\to r)\models (p\to (q\to r))$ ^[104]	from (if $p$ and $q$ are true then $r$ is true) we can prove (if $q$ is true then $r$ is true, if $p$ is true)
Importation	$(p\to (q\to r))$ ⟚ $((p\land q)\to r)$ ^[34]	If $p$ then (if $q$ then $r$ ) is equivalent to if $p$ and $q$ then $r$
Tautology (1)	$p$ ⟚ $(p\lor p)$ ^[103]	$p$ is true is equiv. to $p$ is true or $p$ is true
Tautology (2)	$p$ ⟚ $(p\land p)$ ^[103]	$p$ is true is equiv. to $p$ is true and $p$ is true
Tertium non datur (Law of Excluded Middle)	$\models (p\lor \neg p)$ ^[30]^[103]	$p$ or not $p$ is true
Law of Non-Contradiction	$\models \neg (p\land \neg p)$ ^[30]^[103]	$p$ and not $p$ is false, is a true statement
Explosion	$(p\land \neg p)\models q$ ^[30]	$p$ and not $p$ ; therefore $q$

Syntactic proof via natural deduction[edit]

Natural deduction, since it is a method of syntactical proof, is specified by providing inference rules (also called rules of proof)^[34] for a language with the typical set of connectives $\{-,\&,\lor ,\to ,\leftrightarrow \}$ ; no axioms are used other than these rules.^[105] The rules are covered below, and a proof example is given afterwards.

Notation styles[edit]

Different authors vary to some extent regarding which inference rules they give, which will be noted. More striking to the look and feel of a proof, however, is the variation in notation styles. The § Gentzen notation, which was covered earlier for a short argument, can actually be stacked to produce large tree-shaped natural deduction proofs^[39]^[11]—not to be confused with "truth trees", which is another name for analytic tableaux.^[66] There is also a style due to Stanisław Jaśkowski, where the formulas in the proof are written inside various nested boxes,^[39] and there is a simplification of Jaśkowski's style due to Fredric Fitch (Fitch notation), where the boxes are simplified to simple horizontal lines beneath the introductions of suppositions, and vertical lines to the left of the lines that are under the supposition.^[39] Lastly, there is the only notation style which will actually be used in this article, which is due to Patrick Suppes,^[39] but was much popularized by E.J. Lemmon and Benson Mates.^[106] This method has the advantage that, graphically, it is the least intensive to produce and display, which made it a natural choice for the editor who wrote this part of the article, who did not understand the complex LaTeX commands that would be required to produce proofs in the other methods.

A proof, then, laid out in accordance with the Suppes–Lemmon notation style,^[39] is a sequence of lines containing sentences,^[34] where each sentence is either an assumption, or the result of applying a rule of proof to earlier sentences in the sequence.^[34] Each line of proof is made up of a sentence of proof, together with its annotation, its assumption set, and the current line number.^[34] The assumption set lists the assumptions on which the given sentence of proof depends, which are referenced by the line numbers.^[34] The annotation specifies which rule of proof was applied, and to which earlier lines, to yield the current sentence.^[34] See the § Natural deduction proof example.

Inference rules[edit]

Natural deduction inference rules, due ultimately to Gentzen, are given below.^[105] There are ten primitive rules of proof, which are the rule assumption, plus four pairs of introduction and elimination rules for the binary connectives, and the rule reductio ad adbsurdum.^[34] Disjunctive Syllogism can be used as an easier alternative to the proper ∨-elimination,^[34] and MTT and DN are commonly given rules,^[105] although they are not primitive.^[34]

List of Inference Rules
Rule Name	Alternative names	Annotation	Assumption set	Statement
Rule of Assumptions^[105]	Assumption^[34]	A^[105]^[34]	The current line number.^[34]	At any stage of the argument, introduce a proposition as an assumption of the argument.^[105]^[34]
Conjunction introduction	Ampersand introduction,^[105]^[34] conjunction (CONJ)^[34]^[107]	m, n &I^[34]^[105]	The union of the assumption sets at lines m and n.^[34]	From $\varphi$ and $\psi$ at lines m and n, infer $\varphi ~\&~\psi$ .^[105]^[34]
Conjunction elimination	Simplification (S),^[34] ampersand elimination^[105]^[34]	m &E^[34]^[105]	The same as at line m.^[34]	From $\varphi ~\&~\psi$ at line m, infer $\varphi$ and $\psi$ .^[34]^[105]
Disjunction introduction^[105]	Addition (ADD)^[34]	m ∨I^[34]^[105]	The same as at line m.^[34]	From $\varphi$ at line m, infer $\varphi \lor \psi$ , whatever $\psi$ may be.^[34]^[105]
Disjunction elimination	Wedge elimination,^[105] dilemma (DL)^[107]	j,k,l,m,n ∨E^[105]	The lines j,k,l,m,n.^[105]	From $\varphi \lor \psi$ at line j, and an assumption of $\varphi$ at line k, and a derivation of $\chi$ from $\varphi$ at line l, and an assumption of $\psi$ at line m, and a derivation of $\chi$ from $\psi$ at line n, infer $\chi$ .^[105]
Disjunctive Syllogism	Wedge elimination (∨E),^[34] modus tollendo ponens (MTP)^[34]	m,n DS^[34]	The union of the assumption sets at lines m and n.^[34]	From $\varphi \lor \psi$ at line m and $-\varphi$ at line n, infer $\psi$ ; from $\varphi \lor \psi$ at line m and $-\psi$ at line n, infer $\varphi$ .^[34]
Arrow elimination^[34]	Modus ponendo ponens (MPP),^[105]^[34] modus ponens (MP),^[107]^[34] conditional elimination	m, n →E^[34]^[105]	The union of the assumption sets at lines m and n.^[34]	From $\varphi \to \psi$ at line m, and $\varphi$ at line n, infer $\psi$ .^[34]
Arrow introduction^[34]	Conditional proof (CP),^[107]^[105]^[34] conditional introduction	n, →I (m)^[34]^[105]	Everything in the assumption set at line n, excepting m, the line where the antecedent was assumed.^[34]	From $\psi$ at line n, following from the assumption of $\varphi$ at line m, infer $\varphi \to \psi$ .^[34]
Reductio ad absurdum^[105]	Indirect Proof (IP),^[34] negation introduction (−I),^[34] negation elimination (−E)^[34]	m, n RAA (k)^[34]	The union of the assumption sets at lines m and n, excluding k (the denied assumption).^[34]	From a sentence and its denial^[k] at lines m and n, infer the denial of any assumption appearing in the proof (at line k).^[34]
Double arrow introduction^[34]	Biconditional definition (Df ↔),^[105] biconditional introduction	m, n ↔ I^[34]	The union of the assumption sets at lines m and n.^[34]	From $\varphi \to \psi$ and $\psi \to \varphi$ at lines m and n, infer $\varphi \leftrightarrow \psi$ .^[34]
Double arrow elimination^[34]	Biconditional definition (Df ↔),^[105] biconditional elimination	m ↔ E^[34]	The same as at line m.^[34]	From $\varphi \leftrightarrow \psi$ at line m, infer either $\varphi \to \psi$ or $\psi \to \varphi$ .^[34]
Double negation^[105]^[107]	Double negation elimination	m DN^[105]	The same as at line m.^[105]	From $--\varphi$ at line m, infer $\varphi$ .^[105]
Modus tollendo tollens^[105]	Modus tollens (MT)^[107]	m, n MTT^[105]	The union of the assumption sets at lines m and n.^[105]	From $\varphi \to \psi$ at line m, and $-\psi$ at line n, infer $-\varphi$ .^[105]

Natural deduction proof example[edit]

The proof below^[34] derives $-P$ from $P\to Q$ and $-Q$ using only MPP and RAA, which shows that MTT is not a primitive rule, since it can be derived from those two other rules.

Derivation of MTT from MPP and RAA
Assumption set	Line number	Sentence of proof	Annotation
1	1	$P\to Q$	A
2	2	$-Q$	A
3	3	$P$	A
1, 3	4	$Q$	1, 3 →E
1, 2	5	$-P$	2, 4 RAA

Other example syntactic proof systems[edit]

Consider again the logical form of the § Example argument, formalized as in § Formalization:

{\begin{array}{rl}1.&P\to Q\\2.&P\\\hline \therefore &Q\end{array}}

The logical form of this argument is modus ponens, which is a classically valid form. It generalizes schematically. Thus, where $φ$ and $ψ$ may be any propositions at all, rather than only atomic propositions (cf. § Constants and schemata):

{\begin{array}{rl}1.&\varphi \to \psi \\2.&\varphi \\\hline \therefore &\psi \end{array}}

Other argument forms are convenient, but not necessary. Given a complete set of axioms (see below for one such set), modus ponens is sufficient to prove all other argument forms in propositional logic, thus they may be considered to be a derivative. Note, this is not true of the extension of propositional logic to other logics like first-order logic. First-order logic requires at least one additional rule of inference in order to obtain completeness.

The significance of argument in formal logic is that one may obtain new truths from established truths. In the first example above, given the two premises, the truth of $Q$ is not yet known or stated. After the argument is made, $Q$ is deduced. In this way, we define a deduction system to be a set of all propositions that may be deduced from another set of propositions. For instance, given the set of propositions $A=\{P\lor Q,\neg Q\land R,(P\lor Q)\to R\}$ , we can define a deduction system, $Γ$ , which is the set of all propositions which follow from $A$ . Reiteration is always assumed, so $P\lor Q,\neg Q\land R,(P\lor Q)\to R\in \Gamma$ . Also, from the first element of $A$ , last element, as well as modus ponens, $R$ is a consequence, and so $R\in \Gamma$ . Because we have not included sufficiently complete axioms, though, nothing else may be deduced. Thus, even though most deduction systems studied in propositional logic are able to deduce $(P\lor Q)\leftrightarrow (\neg P\to Q)$ , this one is too weak to prove such a proposition.

Formal structure for example systems[edit]

One of the main uses of a propositional calculus, when interpreted for logical applications, is to determine relations of logical equivalence between propositional formulas. These relationships are determined by means of the available transformation rules, sequences of which are called derivations or proofs.

The following examples of proof systems for a propositional calculus will assume a calculus defined as a formal system ${\mathcal {L}}={\mathcal {L}}\left(\mathrm {A} ,\ \Omega ,\ \mathrm {Z} ,\ \mathrm {I} \right)$ , where:

The alpha set $\mathrm {A}$ is a countably infinite set of ${\mathcal {L}}$ 's atomic formulas or propositional variables. In the examples to follow, the elements of $\mathrm {A}$ are typically the letters $p$ , $q$ , $r$ , and so on.
The omega set $Ω$ is a finite set of elements called operator symbols or logical connectives. The set $Ω$ is partitioned into disjoint subsets as $\Omega =\Omega _{0}\cup \Omega _{1}\cup \cdots \cup \Omega _{j}\cup \cdots \cup \Omega _{m}.$ , where, $\Omega _{j}$ is the set of operator symbols of arity $j$ . For instance, a partition of $Ω$ for the typical five connectives would have $\Omega _{1}=\{\lnot \},$ and $\Omega _{2}\subseteq \{\land ,\lor ,\to ,\leftrightarrow \}.$ Also, the constant logical values are treated as operators of arity zero, so that $\Omega _{0}=\{\bot ,\top \}.$

The zeta set $\mathrm {Z}$ is a finite set of transformation rules, called inference rules when they acquire logical applications.
The iota set $\mathrm {I}$ is a countable set of initial points that are called axioms when they receive logical interpretations.

The language ${\mathcal {L}}$ is its set of well-formed formulas, inductively defined by the following rules:

Base: Any element of the alpha set $\mathrm {A}$ is a formula of ${\mathcal {L}}$ .
If $p_{1},p_{2},\ldots ,p_{j}$ are formulas and $f$ is in $\Omega _{j}$ , then $fp_{1}p_{2}\ldots p_{j}$ is a formula.
Closed: Nothing else is a formula of ${\mathcal {L}}$ .

Repeated applications of these rules permits the construction of complex formulas. Examples of formulas that follow these rules include " $p$ " (by rule 1), " $\neg p$ " (by rule 2), " $q$ " (by rule 1), and " $\neg p\lor q$ " (by rule 2).^[l]

In the discussion to follow, after a proof system is defined, a proof is presented as a sequence of numbered lines, with each line consisting of a single formula followed by a reason or justification for introducing that formula. Each premise of the argument, that is, an assumption introduced as a hypothesis of the argument, is listed at the beginning of the sequence and is marked as a "premise" in lieu of other justification. The conclusion is listed on the last line. A proof is complete if every line follows from the previous ones by the correct application of a transformation rule. (For a contrasting approach, see proof-trees).

Jan Łukasiewicz axiomatic proof system example[edit]

Let ${\mathcal {L}}_{Ax}={\mathcal {L}}(\mathrm {A} ,\Omega ,\mathrm {Z} ,\mathrm {I} )$ , where $\mathrm {A}$ , $\Omega$ , $\mathrm {Z}$ , $\mathrm {I}$ are defined as follows:

The set $\mathrm {A}$ , the countably infinite set of symbols that serve to represent logical propositions: $\mathrm {A} =\{p,q,r,s,t,u,p_{2},\ldots \}.$
The functionally complete set $\Omega$ of logical operators (logical connectives and negation) is as follows. Of the three connectives for conjunction, disjunction, and implication ( $\wedge ,\lor$ , and $\to$ ), one can be taken as primitive and the other two can be defined in terms of it and negation ( $\neg$ ).^[108] Alternatively, all of the logical operators may be defined in terms of a sole sufficient operator, such as the Sheffer stroke (nand). The biconditional ( $a\leftrightarrow b$ ) can of course be defined in terms of conjunction and implication as $(a\to b)\land (b\to a)$ . Adopting negation and implication as the two primitive operations of a propositional calculus is tantamount to having the omega set $\Omega =\Omega _{1}\cup \Omega _{2}$ partitioned as $\Omega _{1}=\{\lnot \},$ and $\Omega _{2}=\{\to \}.$ Then $a\lor b$ is defined as $\neg a\to b$ , and $a\land b$ is defined as $\neg (a\to \neg b)$ .

The set $\mathrm {I}$ $\mathrm {I}$ (the set of initial points of logical deduction, i.e., logical axioms) is the axiom system proposed by Jan Łukasiewicz, and used as the propositional-calculus part of a Hilbert system. The axioms are all substitution instances of:
- $p\to (q\to p)$
- $(p\to (q\to r))\to ((p\to q)\to (p\to r))$
- $(\neg p\to \neg q)\to (q\to p)$
The set $\mathrm {Z}$ of transformation rules (rules of inference) is the sole rule modus ponens (i.e., from any formulas of the form $\varphi$ and $(\varphi \to \psi )$ , infer $\psi$ ).

This system is used in Metamath set.mm formal proof database.

Example of a proof in an axiomatic propositional calculus system[edit]

We now prove the same theorem $A\to A$ in the axiomatic system by Jan Łukasiewicz described above, which is an example of a Hilbert-style deductive system for the classical propositional calculus.

The axioms are:

(A1)

(p\to (q\to p))

(A2)

((p\to (q\to r))\to ((p\to q)\to (p\to r)))

(A3)

((\neg p\to \neg q)\to (q\to p))

And the proof is as follows:

$A\to ((B\to A)\to A)$ (instance of (A1))
$(A\to ((B\to A)\to A))\to ((A\to (B\to A))\to (A\to A))$ (instance of (A2))
$(A\to (B\to A))\to (A\to A)$ (from (1) and (2) by modus ponens)
$A\to (B\to A)$ (instance of (A1))
$A\to A$ (from (4) and (3) by modus ponens)

Soundness and completeness of the rules[edit]

The crucial properties of this set of rules are that they are sound and complete. Informally this means that the rules are correct and that no other rules are required. These claims can be made more formal as follows. The proofs for the soundness and completeness of the propositional logic are not themselves proofs in propositional logic; these are theorems in ZFC used as a metatheory to prove properties of propositional logic.

We define a truth assignment as a function that maps propositional variables to true or false. Informally such a truth assignment can be understood as the description of a possible state of affairs (or possible world) where certain statements are true and others are not. The semantics of formulas can then be formalized by defining for which "state of affairs" they are considered to be true, which is what is done by the following definition.

We define when such a truth assignment $A$ satisfies a certain well-formed formula with the following rules:

$A$ satisfies the propositional variable $P$ if and only if $A (P) = true$
$A$ satisfies $\neg φ$ if and only if $A$ does not satisfy $φ$
$A$ satisfies $(φ \land ψ)$ if and only if $A$ satisfies both $φ$ and $ψ$
$A$ satisfies $(φ \lor ψ)$ if and only if $A$ satisfies at least one of either $φ$ or $ψ$
$A$ satisfies $(φ \to ψ)$ if and only if it is not the case that $A$ satisfies $φ$ but not $ψ$
$A$ satisfies $(φ \leftrightarrow ψ)$ if and only if $A$ satisfies both $φ$ and $ψ$ or satisfies neither one of them

With this definition we can now formalize what it means for a formula $φ$ to be implied by a certain set $S$ of formulas. Informally this is true if in all worlds that are possible given the set of formulas $S$ the formula $φ$ also holds. This leads to the following formal definition: We say that a set $S$ of well-formed formulas semantically entails (or implies) a certain well-formed formula $φ$ if all truth assignments that satisfy all the formulas in $S$ also satisfy $φ$ .

Finally we define syntactical entailment such that $φ$ is syntactically entailed by $S$ if and only if we can derive it with the inference rules that were presented above in a finite number of steps. This allows us to formulate exactly what it means for the set of inference rules to be sound and complete:

Soundness: If the set of well-formed formulas $S$ syntactically entails the well-formed formula $φ$ then $S$ semantically entails $φ$ .

Completeness: If the set of well-formed formulas $S$ semantically entails the well-formed formula $φ$ then $S$ syntactically entails $φ$ .

For the above set of rules this is indeed the case.

Sketch of a soundness proof[edit]

(For most logical systems, this is the comparatively "simple" direction of proof)

Notational conventions: Let $G$ be a variable ranging over sets of sentences. Let $A, B$ and $C$ range over sentences. For " $G$ syntactically entails $A$ " we write " $G$ proves $A$ ". For " $G$ semantically entails $A$ " we write " $G$ implies $A$ ".

We want to show: $(A)(G)$ (if $G$ proves $A$ , then $G$ implies $A$ ).

We note that " $G$ proves $A$ " has an inductive definition, and that gives us the immediate resources for demonstrating claims of the form "If $G$ proves $A$ , then ...". So our proof proceeds by induction.

Basis. Show: If $A$ is a member of $G$ , then $G$ implies $A$ .
Basis. Show: If $A$ is an axiom, then $G$ implies $A$ .
Inductive step (induction on n, the length of the proof):
1. Assume for arbitrary $G$ and $A$ that if $G$ proves $A$ in $n$ or fewer steps, then $G$ implies $A$ .
2. For each possible application of a rule of inference at step $n + 1$ , leading to a new theorem $B$ , show that $G$ implies $B$ .

Notice that Basis Step II can be omitted for natural deduction systems because they have no axioms. When used, Step II involves showing that each of the axioms is a (semantic) logical truth.

The Basis steps demonstrate that the simplest provable sentences from $G$ are also implied by $G$ , for any $G$ . (The proof is simple, since the semantic fact that a set implies any of its members, is also trivial.) The Inductive step will systematically cover all the further sentences that might be provable—by considering each case where we might reach a logical conclusion using an inference rule—and shows that if a new sentence is provable, it is also logically implied. (For example, we might have a rule telling us that from " $A$ " we can derive " $A$ or $B$ ". In III.a We assume that if $A$ is provable it is implied. We also know that if $A$ is provable then " $A$ or $B$ " is provable. We have to show that then " $A$ or $B$ " too is implied. We do so by appeal to the semantic definition and the assumption we just made. $A$ is provable from $G$ , we assume. So it is also implied by $G$ . So any semantic valuation making all of $G$ true makes $A$ true. But any valuation making $A$ true makes " $A$ or $B$ " true, by the defined semantics for "or". So any valuation which makes all of $G$ true makes " $A$ or $B$ " true. So " $A$ or $B$ " is implied.) Generally, the Inductive step will consist of a lengthy but simple case-by-case analysis of all the rules of inference, showing that each "preserves" semantic implication.

By the definition of provability, there are no sentences provable other than by being a member of $G$ , an axiom, or following by a rule; so if all of those are semantically implied, the deduction calculus is sound.

Sketch of completeness proof[edit]

(This is usually the much harder direction of proof.)

We adopt the same notational conventions as above.

We want to show: If $G$ implies $A$ , then $G$ proves $A$ . We proceed by contraposition: We show instead that if $G$ does not prove $A$ then $G$ does not imply $A$ . If we show that there is a model where $A$ does not hold despite $G$ being true, then obviously $G$ does not imply $A$ . The idea is to build such a model out of our very assumption that $G$ does not prove $A$ .

$G$ does not prove $A$ . (Assumption)
If G does not prove A, then we can construct an (infinite) maximal set, G^∗, which is a superset of G and which also does not prove A.
1. Place an ordering (with order type ω) on all the sentences in the language (e.g., shortest first, and equally long ones in extended alphabetical ordering), and number them $(E 1, E 2, ...)$
2. Define a series G_n of sets (G₀, G₁, ...) inductively:
  1. $G_{0}=G$
  2. If $G_{k}\cup \{E_{k+1}\}$ proves $A$ , then $G_{k+1}=G_{k}$
  3. If $G_{k}\cup \{E_{k+1}\}$ does not prove $A$ , then $G_{k+1}=G_{k}\cup \{E_{k+1}\}$
3. Define $G *$ as the union of all the $G n$ . (That is, $G *$ is the set of all the sentences that are in any $G n$ .)
4. It can be easily shown that
  1. $G *$ contains (is a superset of) $G$ (by (b.i));
  2. $G *$ does not prove $A$ (because the proof would contain only finitely many sentences and when the last of them is introduced in some $G n$ , that $G n$ would prove $A$ contrary to the definition of $G n$ ); and
  3. $G *$ is a maximal set with respect to $A$ : If any more sentences whatever were added to $G *$ , it would prove $A$ . (Because if it were possible to add any more sentences, they should have been added when they were encountered during the construction of the $G n$ , again by definition)
If G^∗ is a maximal set with respect to A, then it is truth-like. This means that it contains C if and only if it does not contain ¬C; If it contains C and contains "If C then B" then it also contains B; and so forth. In order to show this, one has to show the axiomatic system is strong enough for the following:
- For any formulas $C$ and $D$ , if it proves both $C$ and $\negC$ , then it proves $D$ . From this it follows, that a maximal set with respect to $A$ cannot prove both $C$ and $\negC$ , as otherwise it would prove $A$ .
- For any formulas $C$ and $D$ , if it proves both $C$ → $D$ and $\negC$ → $D$ , then it proves $D$ . This is used, together with the deduction theorem, to show that for any formula, either it or its negation is in $G *$ : Let $B$ be a formula not in $G *$ ; then $G *$ with the addition of $B$ proves $A$ . Thus from the deduction theorem it follows that $G *$ proves $B$ → $A$ . But suppose $\negB$ were also not in $G *$ , then by the same logic $G *$ also proves $\negB$ → $A$ ; but then $G *$ proves $A$ , which we have already shown to be false.
- For any formulas $C$ and $D$ , if it proves $C$ and $D$ , then it proves $C$ → $D$ .
- For any formulas $C$ and $D$ , if it proves $C$ and $\negD$ , then it proves ¬( $C$ → $D$ ).
- For any formulas $C$ and $D$ , if it proves $\negC$ , then it proves $C$ → $D$ .
If additional logical operation (such as conjunction and/or disjunction) are part of the vocabulary as well, then there are additional requirement on the axiomatic system (e.g. that if it proves C and D, it would also prove their conjunction).
If $G *$ is truth-like there is a $G *$ -Canonical valuation of the language: one that makes every sentence in $G *$ true and everything outside $G *$ false while still obeying the laws of semantic composition in the language. The requirement that it is truth-like is needed to guarantee that the laws of semantic composition in the language will be satisfied by this truth assignment.
A $G *$ -canonical valuation will make our original set $G$ all true, and make $A$ false.
If there is a valuation on which $G$ are true and $A$ is false, then $G$ does not (semantically) imply $A$ .

Thus every system that has modus ponens as an inference rule, and proves the following theorems (including substitutions thereof) is complete:

$p\to (\neg p\to q)$
$(p\to q)\to ((\neg p\to q)\to q)$
$p\to (q\to (p\to q))$
$p\to (\neg q\to \neg (p\to q))$
$\neg p\to (p\to q)$
$p\to p$
$p\to (q\to p)$
$(p\to (q\to r))\to ((p\to q)\to (p\to r))$

The first five are used for the satisfaction of the five conditions in stage III above, and the last three for proving the deduction theorem.

Example[edit]

As an example, it can be shown that as any other tautology, the three axioms of the classical propositional calculus system described earlier can be proven in any system that satisfies the above, namely that has modus ponens as an inference rule, and proves the above eight theorems (including substitutions thereof). Out of the eight theorems, the last two are two of the three axioms; the third axiom, $(\neg q\to \neg p)\to (p\to q)$ , can be proven as well, as we now show.

For the proof we may use the hypothetical syllogism theorem (in the form relevant for this axiomatic system), since it only relies on the two axioms that are already in the above set of eight theorems. The proof then is as follows:

$q\to (p\to q)$ (instance of the 7th theorem)
$(q\to (p\to q))\to ((\neg q\to \neg p)\to (q\to (p\to q)))$ (instance of the 7th theorem)
$(\neg q\to \neg p)\to (q\to (p\to q))$ (from (1) and (2) by modus ponens)
$(\neg p\to (p\to q))\to ((\neg q\to \neg p)\to (\neg q\to (p\to q)))$ (instance of the hypothetical syllogism theorem)
$(\neg p\to (p\to q))$ (instance of the 5th theorem)
$(\neg q\to \neg p)\to (\neg q\to (p\to q))$ (from (5) and (4) by modus ponens)
$(q\to (p\to q))\to ((\neg q\to (p\to q))\to (p\to q))$ (instance of the 2nd theorem)
$((q\to (p\to q))\to ((\neg q\to (p\to q))\to (p\to q)))\to ((\neg q\to \neg p)\to ((q\to (p\to q))\to ((\neg q\to (p\to q))\to (p\to q))))$ (instance of the 7th theorem)
$(\neg q\to \neg p)\to ((q\to (p\to q))\to ((\neg q\to (p\to q))\to (p\to q)))$ (from (7) and (8) by modus ponens)
$((\neg q\to \neg p)\to ((q\to (p\to q))\to ((\neg q\to (p\to q))\to (p\to q))))\to$
$(((\neg q\to \neg p)\to (q\to (p\to q)))\to ((\neg q\to \neg p)\to ((\neg q\to (p\to q))\to (p\to q))))$ (instance of the 8th theorem)
$((\neg q\to \neg p)\to (q\to (p\to q)))\to ((\neg q\to \neg p)\to ((\neg q\to (p\to q))\to (p\to q)))$ (from (9) and (10) by modus ponens)
$(\neg q\to \neg p)\to ((\neg q\to (p\to q))\to (p\to q))$ (from (3) and (11) by modus ponens)
$((\neg q\to \neg p)\to ((\neg q\to (p\to q))\to (p\to q)))\to (((\neg q\to \neg p)\to (\neg q\to (p\to q)))\to ((\neg q\to \neg p)\to (p\to q)))$ (instance of the 8th theorem)
$((\neg q\to \neg p)\to (\neg q\to (p\to q)))\to ((\neg q\to \neg p)\to (p\to q))$ (from (12) and (13) by modus ponens)
$(\neg q\to \neg p)\to (p\to q)$ (from (6) and (14) by modus ponens)

Verifying completeness for the classical propositional calculus system[edit]

We now verify that the classical propositional calculus system described earlier can indeed prove the required eight theorems mentioned above. We use several lemmas proven here:

(DN1)

\neg \neg p\to p

- Double negation (one direction)

(DN2)

p\to \neg \neg p

- Double negation (another direction)

(HS1)

(q\to r)\to ((p\to q)\to (p\to r))

- one form of Hypothetical syllogism

(HS2)

(p\to q)\to ((q\to r)\to (p\to r))

- another form of Hypothetical syllogism

(TR1)

(p\to q)\to (\neg q\to \neg p)

- Transposition

(TR2)

(\neg p\to q)\to (\neg q\to p)

- another form of transposition.

(L1)

p\to ((p\to q)\to q)

(L3)

(\neg p\to p)\to p

We also use the method of the hypothetical syllogism metatheorem as a shorthand for several proof steps.

$p\to (\neg p\to q)$ $p\to (\neg p\to q)$ - proof:
1. $p\to (\neg q\to p)$ (instance of (A1))
2. $(\neg q\to p)\to (\neg p\to \neg \neg q)$ (instance of (TR1))
3. $p\to (\neg p\to \neg \neg q)$ (from (1) and (2) using the hypothetical syllogism metatheorem)
4. $\neg \neg q\to q$ (instance of (DN1))
5. $(\neg \neg q\to q)\to ((\neg p\to \neg \neg q)\to (\neg p\to q))$ (instance of (HS1))
6. $(\neg p\to \neg \neg q)\to (\neg p\to q)$ (from (4) and (5) using modus ponens)
7. $p\to (\neg p\to q)$ (from (3) and (6) using the hypothetical syllogism metatheorem)
$(p\to q)\to ((\neg p\to q)\to q)$ $(p\to q)\to ((\neg p\to q)\to q)$ - proof:
1. $(p\to q)\to ((\neg q\to p)\to (\neg q\to q))$ (instance of (HS1))
2. $(\neg q\to q)\to q$ (instance of (L3))
3. $((\neg q\to q)\to q)\to (((\neg q\to p)\to (\neg q\to q))\to ((\neg q\to p)\to q))$ (instance of (HS1))
4. $((\neg q\to p)\to (\neg q\to q))\to ((\neg q\to p)\to q)$ (from (2) and (3) by modus ponens)
5. $(p\to q)\to ((\neg q\to p)\to q)$ (from (1) and (4) using the hypothetical syllogism metatheorem)
6. $(\neg p\to q)\to (\neg q\to p)$ (instance of (TR2))
7. $((\neg p\to q)\to (\neg q\to p))\to (((\neg q\to p)\to q)\to ((\neg p\to q)\to q))$ (instance of (HS2))
8. $((\neg q\to p)\to q)\to ((\neg p\to q)\to q)$ (from (6) and (7) using modus ponens)
9. $(p\to q)\to ((\neg p\to q)\to q)$ (from (5) and (8) using the hypothetical syllogism metatheorem)
$p\to (q\to (p\to q))$ $p\to (q\to (p\to q))$ - proof:
1. $q\to (p\to q)$ (instance of (A1))
2. $(q\to (p\to q))\to (p\to (q\to (p\to q)))$ (instance of (A1))
3. $p\to (q\to (p\to q))$ (from (1) and (2) using modus ponens)
$p\to (\neg q\to \neg (p\to q))$ $p\to (\neg q\to \neg (p\to q))$ - proof:
1. $p\to ((p\to q)\to q)$ (instance of (L1))
2. $((p\to q)\to q)\to (\neg q\to \neg (p\to q))$ (instance of (TR1))
3. $p\to (\neg q\to \neg (p\to q))$ (from (1) and (2) using the hypothetical syllogism metatheorem)
$\neg p\to (p\to q)$ $\neg p\to (p\to q)$ - proof:
1. $\neg p\to (\neg q\to \neg p)$ (instance of (A1))
2. $(\neg q\to \neg p)\to (p\to q)$ (instance of (A3))
3. $\neg p\to (p\to q)$ (from (1) and (2) using the hypothetical syllogism metatheorem)
$p\to p$ - proof given in the proof example above
$p\to (q\to p)$ - axiom (A1)
$(p\to (q\to r))\to ((p\to q)\to (p\to r))$ - axiom (A2)

Another outline for a completeness proof[edit]

If a formula is a tautology, then there is a truth table for it which shows that each valuation yields the value true for the formula. Consider such a valuation. By mathematical induction on the length of the subformulas, show that the truth or falsity of the subformula follows from the truth or falsity (as appropriate for the valuation) of each propositional variable in the subformula. Then combine the lines of the truth table together two at a time by using "( $P$ is true implies $S$ ) implies (( $P$ is false implies $S$ ) implies $S$ )". Keep repeating this until all dependencies on propositional variables have been eliminated. The result is that we have proved the given tautology. Since every tautology is provable, the logic is complete.

More complex axiomatic proof system example[edit]

It is possible to define another version of propositional calculus, which defines most of the syntax of the logical operators by means of axioms, and which uses only one inference rule.

Axioms[edit]

Let $φ$ , $χ$ , and $ψ$ stand for well-formed formulas. (The well-formed formulas themselves would not contain any Greek letters, but only capital Roman letters, connective operators, and parentheses.) Then the axioms are as follows:

Axioms
Name	Axiom Schema	Description
THEN-1	$\phi \to (\chi \to \phi )$	Add hypothesis $χ$ , implication introduction
THEN-2	$(\phi \to (\chi \to \psi ))\to ((\phi \to \chi )\to (\phi \to \psi ))$	Distribute hypothesis $\phi$ over implication
AND-1	$\phi \land \chi \to \phi$	Eliminate conjunction
AND-2	$\phi \land \chi \to \chi$
AND-3	$\phi \to (\chi \to (\phi \land \chi ))$	Introduce conjunction
OR-1	$\phi \to \phi \lor \chi$	Introduce disjunction
OR-2	$\chi \to \phi \lor \chi$
OR-3	$(\phi \to \psi )\to ((\chi \to \psi )\to (\phi \lor \chi \to \psi ))$	Eliminate disjunction
NOT-1	$(\phi \to \chi )\to ((\phi \to \neg \chi )\to \neg \phi )$	Introduce negation
NOT-2	$\phi \to (\neg \phi \to \chi )$	Eliminate negation
NOT-3	$\phi \lor \neg \phi$	Excluded middle, classical logic
IFF-1	$(\phi \leftrightarrow \chi )\to (\phi \to \chi )$	Eliminate equivalence
IFF-2	$(\phi \leftrightarrow \chi )\to (\chi \to \phi )$
IFF-3	$(\phi \to \chi )\to ((\chi \to \phi )\to (\phi \leftrightarrow \chi ))$	Introduce equivalence

Axiom THEN-2 may be considered to be a "distributive property of implication with respect to implication."
Axioms AND-1 and AND-2 correspond to "conjunction elimination". The relation between AND-1 and AND-2 reflects the commutativity of the conjunction operator.
Axiom AND-3 corresponds to "conjunction introduction."
Axioms OR-1 and OR-2 correspond to "disjunction introduction." The relation between OR-1 and OR-2 reflects the commutativity of the disjunction operator.
Axiom NOT-1 corresponds to "reductio ad absurdum."
Axiom NOT-2 says that "anything can be deduced from a contradiction."
Axiom NOT-3 is called "tertium non-datur" (Latin: "a third is not given") and reflects the semantic valuation of propositional formulas: a formula can have a truth-value of either true or false. There is no third truth-value, at least not in classical logic. Intuitionistic logicians do not accept the axiom NOT-3.

Inference rule[edit]

The inference rule is modus ponens:

{\frac {\phi ,\ \phi \to \chi }{\chi }}

.

Meta-inference rule[edit]

Let a demonstration be represented by a sequence, with hypotheses to the left of the turnstile and the conclusion to the right of the turnstile. Then the deduction theorem can be stated as follows:

If the sequence

\phi _{1},\ \phi _{2},\ ...,\ \phi _{n},\ \chi \vdash \psi

has been demonstrated, then it is also possible to demonstrate the sequence

\phi _{1},\ \phi _{2},\ ...,\ \phi _{n}\vdash \chi \to \psi

.

This deduction theorem (DT) is not itself formulated with propositional calculus: it is not a theorem of propositional calculus, but a theorem about propositional calculus. In this sense, it is a meta-theorem, comparable to theorems about the soundness or completeness of propositional calculus.

On the other hand, DT is so useful for simplifying the syntactical proof process that it can be considered and used as another inference rule, accompanying modus ponens. In this sense, DT corresponds to the natural conditional proof inference rule which is part of the first version of propositional calculus introduced in this article.

The converse of DT is also valid:

If the sequence

\phi _{1},\ \phi _{2},\ ...,\ \phi _{n}\vdash \chi \to \psi

has been demonstrated, then it is also possible to demonstrate the sequence

\phi _{1},\ \phi _{2},\ ...,\ \phi _{n},\ \chi \vdash \psi

in fact, the validity of the converse of DT is almost trivial compared to that of DT:

If

\phi _{1},\ ...,\ \phi _{n}\vdash \chi \to \psi

then

1:

\phi _{1},\ ...,\ \phi _{n},\ \chi \vdash \chi \to \psi

2:

\phi _{1},\ ...,\ \phi _{n},\ \chi \vdash \chi

and from (1) and (2) can be deduced

3:

\phi _{1},\ ...,\ \phi _{n},\ \chi \vdash \psi

by means of modus ponens, Q.E.D.

The converse of DT has powerful implications: it can be used to convert an axiom into an inference rule. For example, by axiom AND-1 we have,

\vdash \phi \wedge \chi \to \phi ,

which can be transformed by means of the converse of the deduction theorem into

\phi \wedge \chi \vdash \phi ,

which tells us that the inference rule

{\frac {\phi \wedge \chi }{\phi }}

is admissible. This inference rule is conjunction elimination, one of the ten inference rules used in the first version (in this article) of the propositional calculus.

Example of a proof in the more complex axiomatic system[edit]

The following is an example of a (syntactical) demonstration, involving only axioms THEN-1 and THEN-2:

Prove: $A\to A$ (Reflexivity of implication).

Proof:

$(A\to ((B\to A)\to A))\to ((A\to (B\to A))\to (A\to A))$
Axiom THEN-2 with $\phi =A,\chi =B\to A,\psi =A$
$A\to ((B\to A)\to A)$
Axiom THEN-1 with $\phi =A,\chi =B\to A$
$(A\to (B\to A))\to (A\to A)$
From (1) and (2) by modus ponens.
$A\to (B\to A)$
Axiom THEN-1 with $\phi =A,\chi =B$
$A\to A$
From (3) and (4) by modus ponens.

Solvers[edit]

One notable difference between propositional calculus and predicate calculus is that satisfiability of a propositional formula is decidable.^[109] Deciding satisfiability of propositional logic formulas is an NP-complete problem. However, practical methods exist (e.g., DPLL algorithm, 1962; Chaff algorithm, 2001) that are very fast for many useful cases. Recent work has extended the SAT solver algorithms to work with propositions containing arithmetic expressions; these are the SMT solvers.

^ Many sources write this with a definite article, as the propositional calculus, while others just call it propositional calculus with no article.
^ The "or both" makes it clear^[30] that it's a logical disjunction, not an exclusive or, which is more common in English.
^ The set of premises may be the empty set;^[33]^[34] an argument from an empty set of premises is valid if, and only if, the conclusion is a tautology.^[33]^[34]
^ The turnstile (for syntactic consequence) is of a higher level than the comma (for premise combination), which is of a higher level than the arrow (for material implication), so no parentheses are needed to interpret this formula.^[40]
^ A very general and abstract syntax is given here, following the notation in the SEP,^[2] but including the third definition, which is very commonly given explicitly by other sources, such as Gillon,^[10] Bostock,^[33] Allen & Hand,^[34] and many others. As noted elsewhere in the article, languages variously compose their set of atomic propositional variables from uppercase or lowercase letters (often focusing on P/p, Q/q, and R/r), with or without subscript numerals; and in their set of connectives, they may include either the full set of five typical connectives, $\{\neg ,\land ,\lor ,\to ,\leftrightarrow \}$ , or any of the truth-functionally complete subsets of it. (And, of course, they may also use any of the notational variants of these connectives.)
^ Note that the phrase "principle of composition" has referred to other things in other contexts, and even in the context of logic, since Bertrand Russell used it to refer to the principle that "a proposition which implies each of two propositions implies them both."^[49]
^ The name "interpretation" is used by some authors and the name "case" by other authors. This article will be indifferent and use either, since it is collaboratively edited and there is no consensus about which terminology to adopt.
^ A truth-functionally complete set of connectives^[2] is also called simply functionally complete, or adequate for truth-functional logic,^[35] or expressively adequate,^[72] or simply adequate.^[35]^[72]
^ Some of these definitions use the word "interpretation", and speak of sentences/formulas being true or false "under" it, and some will use the word "case", and speak of sentences/formulas being true or false "in" it. Published reliable sources (WP:RS) have used both kinds of terminological convention, although usually a given author will use only one of them. Since this article is collaboratively edited and there is no consensus about which convention to use, these variations in terminology have been left standing.
^ Conventionally $\models \varphi$ , with nothing to the left of the turnstile, is used to symbolize a tautology. It may be interpreted as saying that $\varphi$ is a semantic consequence of the empty set of formulae, i.e., $\{\}\models \varphi$ , but with the empty brackets omitted for simplicity;^[33] which is just the same as to say that it is a tautology, i.e., that there is no interpretation under which it is false.^[33]
^ To simplify the statement of the rule, the word "denial" here is used in this way: the denial of a formula $\varphi$ that is not a negation is $-\varphi$ , whereas a negation, $-\varphi$ , has two denials, viz., $\varphi$ and $--\varphi$ .^[34]
^ Formally, rule 2 obtains formulas in Polish notation, i.e. $\lor \neg pq$ in this example. For convenience, we will use the common infix notation instead in this and all following examples.

References[edit]

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External links[edit]

Klement, Kevin C. (2006), "Propositional Logic", in James Fieser and Bradley Dowden (eds.), Internet Encyclopedia of Philosophy, Eprint.
Formal Predicate Calculus, contains a systematic formal development with axiomatic proof
forall x: an introduction to formal logic, by P.D. Magnus, covers formal semantics and proof theory for sentential logic.
Chapter 2 / Propositional Logic from Logic In Action
Propositional sequent calculus prover on Project Nayuki. (note: implication can be input in the form !X|Y, and a sequent can be a single formula prefixed with > and having no commas)
Propositional Logic - A Generative Grammar
A Propositional Calculator that helps to understand simple expressions

[1] Many sources write this with a definite article, as the propositional calculus, while others just call it propositional calculus with no article.

[34] The "or both" makes it clear^[30] that it's a logical disjunction, not an exclusive or, which is more common in English.

[37] The set of premises may be the empty set;^[33]^[34] an argument from an empty set of premises is valid if, and only if, the conclusion is a tautology.^[33]^[34]

[46] The turnstile (for syntactic consequence) is of a higher level than the comma (for premise combination), which is of a higher level than the arrow (for material implication), so no parentheses are needed to interpret this formula.^[40]

[53] A very general and abstract syntax is given here, following the notation in the SEP,^[2] but including the third definition, which is very commonly given explicitly by other sources, such as Gillon,^[10] Bostock,^[33] Allen & Hand,^[34] and many others. As noted elsewhere in the article, languages variously compose their set of atomic propositional variables from uppercase or lowercase letters (often focusing on P/p, Q/q, and R/r), with or without subscript numerals; and in their set of connectives, they may include either the full set of five typical connectives, $\{\neg ,\land ,\lor ,\to ,\leftrightarrow \}$ , or any of the truth-functionally complete subsets of it. (And, of course, they may also use any of the notational variants of these connectives.)

[55] Note that the phrase "principle of composition" has referred to other things in other contexts, and even in the context of logic, since Bertrand Russell used it to refer to the principle that "a proposition which implies each of two propositions implies them both."^[49]

[68] The name "interpretation" is used by some authors and the name "case" by other authors. This article will be indifferent and use either, since it is collaboratively edited and there is no consensus about which terminology to adopt.

[80] A truth-functionally complete set of connectives^[2] is also called simply functionally complete, or adequate for truth-functional logic,^[35] or expressively adequate,^[72] or simply adequate.^[35]^[72]

[83] Some of these definitions use the word "interpretation", and speak of sentences/formulas being true or false "under" it, and some will use the word "case", and speak of sentences/formulas being true or false "in" it. Published reliable sources (WP:RS) have used both kinds of terminological convention, although usually a given author will use only one of them. Since this article is collaboratively edited and there is no consensus about which convention to use, these variations in terminology have been left standing.

[85] Conventionally $\models \varphi$ , with nothing to the left of the turnstile, is used to symbolize a tautology. It may be interpreted as saying that $\varphi$ is a semantic consequence of the empty set of formulae, i.e., $\{\}\models \varphi$ , but with the empty brackets omitted for simplicity;^[33] which is just the same as to say that it is a tautology, i.e., that there is no interpretation under which it is false.^[33]

[118] To simplify the statement of the rule, the word "denial" here is used in this way: the denial of a formula $\varphi$ that is not a negation is $-\varphi$ , whereas a negation, $-\varphi$ , has two denials, viz., $\varphi$ and $--\varphi$ .^[34]

[119] Formally, rule 2 obtains formulas in Polish notation, i.e. $\lor \neg pq$ in this example. For convenience, we will use the common infix notation instead in this and all following examples.

[:1-2] Jump up to: ^a ^b ^c ^d ^e ^f ^g ^h ⁱ ^j ^k ^l ^m ⁿ ^o ^p ^q ^r ^s ^t ^u ^v ^w ^x ^y "Propositional Logic | Internet Encyclopedia of Philosophy". Retrieved 22 March 2024.

[:2-3] Jump up to: ^a ^b ^c ^d ^e ^f ^g ^h ⁱ ^j ^k ^l ^m ⁿ ^o ^p ^q ^r ^s ^t ^u ^v Franks, Curtis (2023), "Propositional Logic", in Zalta, Edward N.; Nodelman, Uri (eds.), The Stanford Encyclopedia of Philosophy (Fall 2023 ed.), Metaphysics Research Lab, Stanford University, retrieved 22 March 2024

[:18-4] Jump up to: ^a ^b Weisstein, Eric W. "Propositional Calculus". mathworld.wolfram.com. Retrieved 22 March 2024.

[:10-5] Jump up to: ^a ^b Bělohlávek, Radim; Dauben, Joseph Warren; Klir, George J. (2017). Fuzzy logic and mathematics: a historical perspective. New York, NY, United States of America: Oxford University Press. p. 463. ISBN 978-0-19-020001-5.

[:11-6] Jump up to: ^a ^b Manzano, María (2005). Extensions of first order logic. Cambridge tracts in theoretical computer science (Digitally printed first paperback version ed.). Cambridge: Cambridge University Press. p. 180. ISBN 978-0-521-35435-6.

[:22-7] Jump up to: ^a ^b McGrath, Matthew; Frank, Devin (2023), "Propositions", in Zalta, Edward N.; Nodelman, Uri (eds.), The Stanford Encyclopedia of Philosophy (Winter 2023 ed.), Metaphysics Research Lab, Stanford University, retrieved 22 March 2024

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[:3-12] Jump up to: ^a ^b ^c ^d ^e ^f ^g Plato, Jan von (2013). Elements of logical reasoning (1. publ ed.). Cambridge: Cambridge University press. pp. 9, 32, 121. ISBN 978-1-107-03659-8.

[:12-13] Jump up to: ^a ^b "Propositional Logic". www.cs.miami.edu. Retrieved 22 March 2024.

[14] Plato, Jan von (2013). Elements of logical reasoning (1. publ ed.). Cambridge: Cambridge University press. p. 9. ISBN 978-1-107-03659-8.

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History[edit]

Sentences[edit]

Declarative sentences[edit]

Compounding sentences with connectives[edit]

Arguments[edit]

Example argument[edit]

Validity and soundness[edit]

Formalization[edit]

Propositional variables[edit]

Gentzen notation[edit]

Language[edit]

Syntax[edit]

CF grammar in BNF[edit]

Constants and schemata[edit]

Semantics[edit]

Interpretation (case) and argument[edit]

Propositional connective semantics[edit]

Semantics via truth tables[edit]

Semantics via assignment expressions[edit]

Connective definition methods[edit]

Semantic truth, validity, consequence[edit]

Proof systems[edit]

Semantic proof systems[edit]

Truth tables[edit]

Semantic tableaux[edit]

Syntactic proof systems[edit]

Axiomatic systems[edit]

Natural deduction[edit]

Sequent calculus[edit]

Semantic proof via truth tables[edit]

Semantic proof via tableaux[edit]

List of classically valid argument forms[edit]

Syntactic proof via natural deduction[edit]

Notation styles[edit]

Inference rules[edit]

Natural deduction proof example[edit]

Other example syntactic proof systems[edit]

Formal structure for example systems[edit]

Jan Łukasiewicz axiomatic proof system example[edit]

Example of a proof in an axiomatic propositional calculus system[edit]

Soundness and completeness of the rules[edit]

Sketch of a soundness proof[edit]

Sketch of completeness proof[edit]

Example[edit]

Verifying completeness for the classical propositional calculus system[edit]

Another outline for a completeness proof[edit]

More complex axiomatic proof system example[edit]

Axioms[edit]

Inference rule[edit]

Meta-inference rule[edit]

Example of a proof in the more complex axiomatic system[edit]

Solvers[edit]

See also[edit]

Higher logical levels[edit]

Related topics[edit]

Notes[edit]

References[edit]

Further reading[edit]

Related works[edit]

External links[edit]