Micro II
Benny Moldovanu
University of Bonn
Summer Term 2015
Quasi-Linear Utility
x = (k , t 1 , .., t I ), where: k ∈ K (physical outcomes, ”projects”), t i ∈ R (money)
u i (x, θ i ) = v i (k, θ i ) + t i
f (θ) = f (θ 1 , ..θ I ) = (k (θ), t 1 (θ), .., t I (θ)) Definition
Efficient SCF f ∗ (θ) = (k ∗ (θ), t 1 ∗ (θ), .., t I ∗ (θ)) :
1
Value maximization: ∀θ, k ∗ (θ) ∈ arg max k P
i v i (k , θ i )
2
Budget Balance: ∀θ, P
i t i ∗ (θ) = 0
Example: Allocation of indivisble good
Indivisible good owned by seller I buyers
k = (y 1 , .., y I ) where y i ∈ {0, 1} and P y i ≤ 1 v i (k, θ i ) = v i ((y 1 , .., y I ), θ i ) = y i θ i
Efficient allocation: y i = 1 if θ i ∈ arg max j θ j ; all monetary transfers
from buyers go to seller
The Vickrey-Clarke-Groves (VCG) Mechanism
Direct Revelation Mechanism k(θ) = k ∗ (θ) (value maximization) t i ∗ (θ) = P
j 6=i v j (k ∗ (θ), θ j ) + h i (θ −i ), where h i is arbitrary Theorem
The VCG mechanism truthfully implements the value maximizing SCF in
dominant strategies
The Pivot Mechanism
Problem
VCG mechanism requires huge transfers to the agents.
Solution
Appropriate definition of the h i functions
Denote by k −i ∗ (θ −i ) the value maximizing project in the absence of i Define
t i ∗ (θ) = X
j 6=i
v j (k ∗ (θ), θ j ) + h i (θ −i )
= X
j 6=i
v j (k ∗ (θ), θ j ) − X
j 6=i
v j (k −i ∗ (θ −i ), θ j ) Exercise: Prove that : ∀θ, P
i t i ∗ (θ) ≤ 0
Example: Allocation of Indivisible Object
Efficient allocation: y i = 1 if θ i ∈ arg max j θ j In VCG mechanism:
t i ∗ (θ) =
0 + h i (θ −i ), if i = arg max θ j
arg max θ j + h i (θ −i ), otherwise
In pivot mechanism:
t i ∗ (θ) =
− arg max j 6=i θ j , if i = arg max θ j
0, otherwise
Second price auction !
The Green-Laffont Theorem for Bilateral Bargaining I
Agent 1 is seller, owns indivisble object , value for object θ 1
Agent 2 is buyer, value for object θ 2
Values are distributed independently on interval [0, 1] according to densities φ 1 , φ 2 .
VCG Mechanism:
k ∗ (θ) = k ∗ (θ 1 , θ 2 ) =
1, if θ 1 ≥ θ 2 2, otherwise
t 1 ∗ (θ) =
0 + h 1 (θ 2 ), if θ 1 ≥ θ 2 θ 2 + h 1 (θ 2 ), otherwise
t 2 ∗ (θ) =
θ 1 + h 2 (θ 1 ), if θ 1 ≥ θ 2 0 + h 2 (θ 1 ), otherwise
The Green-La¤ont Theorem for Bilateral Bargaining II
Budget Balance:
t 1 ( θ ) + t 2 ( θ ) = 0 )
Z 1
0
Z 1
0 [ t 1 ( θ ) + t 2 ( θ )] φ 1 ( θ 1 ) φ 2 ( θ 2 ) d θ 1 d θ 2 = 0 ) H 1 + H 2 +
Z 1
0
Z 1
0 max [ θ 1 , θ 2 ] φ 1 ( θ 1 ) φ 2 ( θ 2 ) d θ 1 d θ 2 = 0 where H i = E θ
ih i . Noting that θ 1 < max [ θ 1 , θ 2 ] a.e., this yields:
H 1 + H 2 < E θ 1
With positive
probability
The Green-Laffont Theorem for Bilateral Bargaining III
Participation Constraints:
Highest Seller Type : 1 + H 1 ≥ 1 ⇒ H 1 ≥ 0 Lowest Buyer Type : Eθ 1 + H 2 ≥ 0 ⇒ H 2 ≥ −Eθ 1 This yields:
H 1 + H 2 ≥ −E θ 1
a contradiction !
Bayesian Implementation and Payoff Equivalence
Benny Moldovanu
University of Bonn
Summer Term 2015
First-Price Auction
n bidders; i.i.d types F (θ i ), ϕ(θ i ) > 0
Symmetric Equilibrium b i (θ i ) = b(θ i ) increasing and differentiable.
First-Price Auction
U i (θ i , θ ˆ i ) = [θ i − b(ˆ θ i )] · F (ˆ θ i ) n−1
FOC: −b 0 (ˆ θ i )F (ˆ θ i ) n−1 + (n − 1)(θ i − b(ˆ θ i ))F (ˆ θ i ) n−2 ϕ(ˆ θ i ) = 0 b 0 (θ i ) = (n − 1)(θ i − b(θ i ) ϕ(θ F(θ
i)
i
)
b(θ i ) = θ i
First-Price Auction
Example
n = 2, θ i ∼ U[0, 1]
b 0 (θ i ) = θ 1
i
(θ i − b(θ i )); b(0) = 0 Solution: b(θ i ) = 1 2 θ i
Expected Utility: (θ i − 1 2 θ i ) · θ i = 1 2 θ 2 i
Second Price: (θ i − E[θ j |θ j ≤ θ i ])θ i = 1 2 θ i 2
Revenue= 1 3
Myerson’s Auction Model
1 object, n bidders
independent, private values θ i distributed: F i (θ i ), ϕ i (θ i ) > 0
Revelation Mechanism p i (θ) ∈ [0, 1], ∀i ; P n
i =1 p i (θ) ≤ 1
t i (θ) ∈ R, ∀i
Myerson’s Auction Model
q i (θ i ) = E θ
−ip i (θ i , θ −i ) T i (θ i ) = E θ
−it i (θ i , θ −i ) U i (θ i , θ ˆ i ) = θ i q i ( ˆ θ i ) + T i ( ˆ θ i ) Bidder i’s problem:
max θ ˆ
i
U i (θ i , θ ˆ i ) = U i (θ i , θ i )
Truthtelling condition!
Denote ¯ U i (θ i ) = U i (θ i , θ i )
Myerson’s Auction Model
Theorem (Myerson)
A mechanism {p i , t i } n i=1 , is Bayesian incentive compatible if and only if:
1
q i is increasing in θ i
2
U ¯ i (θ i ) = ¯ U i (θ i ) + R θ
iθ
iq i (s)ds, where U ¯ i (θ i ) = U i (θ i , θ i )
Myerson’s Auction Model
Proof.
1) → θ ˆ i > θ i
θ ˆ i q i (ˆ θ i ) + T i (ˆ θ i ) ≥ θ ˆ i q(θ i ) + T i (θ i ) θ i q i (θ i ) + T i (θ i ) ≥ θ i q i (ˆ θ i ) + T i (ˆ θ i )
(ˆ θ i − θ i )q i (ˆ θ i ) ≥
(ˆ θ i − θ i )q i (θ i ) U ¯ i (θ i ) is maximum of affine functions
→ convex, equal integral of its derivative.
Myerson’s Auction Model
Proof. (cont.)
2)← assume w.l.o.g. θ i > θ ˆ i
U ¯ i (θ i ) − U i (θ i , θ ˆ i )
= ¯ U i (θ i ) − U ¯ i (ˆ θ i ) − q(ˆ θ i )[θ i − θ ˆ i ]
= R θ
iθ ˆ
iq(s)ds − q(ˆ θ i )[θ i − θ ˆ i ]
= R θ
iθ ˆ
i[q(s) − q(ˆ θ i )]ds ≥ 0
Myerson’s Auction Model
Consequence:
U ¯ i (θ i ) = ¯ U i (θ i ) + R θ
iθ q(s)ds
= θ i q i (θ i ) + T i (θ i )
⇒ T i (θ i ) = −θ i q i (θ i ) + R θ
iθ q i (s)ds + ¯ U i (θ i )
Payoff and revenue equivalence!
The Optimal Auction
max {p
i,t
i}
ni=1
E θ
n
X
i=1
T i (θ i )
!
1
p i (θ) ∈ [0, 1]; P n
i=1 p i (θ) ≤ 1, ∀θ
2
q i (θ i ) is monotone
Observation: ¯ U i (θ i ) = 0 is optimal
The Optimal Auction
− R θ ¯
iθ
iT i (θ i )ϕ i (θ i )d θ i
= R θ ¯
iθ
i[θ i q i (θ i ) − R θ
iθ
jq i (s )ds]ϕ i (θ i )d θ i
= E θ [θ i p i (θ)] − R θ ¯
iθ
i[ R θ
iθ
iq i (s )ds]ϕ i (θ i )d θ i
The Optimal Auction
R θ ¯
iθ
i[ R θ
iθ
iq i (s )ds]ϕ i (θ i )d θ i
= R θ ¯
iθ
iq i (s )ds − R θ ¯
iθ
iq i (θ i )F i (θ i )d θ i
= R θ ¯
iθ
jq i (θ i )[ 1−F ϕ
i(θ
i)
i
(θ
i) ]ϕ i (θ i )d θ i
The Optimal Auction
= E θ (p i (θ)[ 1−F ϕ(θ
i(θ
i)
i
) ])
to conclude:
−E θ (T i (θ i )) = E θ [p i (θ i )(θ i − 1−F ϕ
i(θ
i)
i
(θ
i) )]
E θ ( P n
i =1 −T i (θ i )) = E θ [ P n
i =1 p i (θ)(θ i − 1−F ϕ(θ
i(θ
i)
i
) )]
The Optimal Auction
Assumption: J i (θ i ) = θ i − 1−F ϕ
i(θ
i)
i
(θ
i) increasing Revenue Maximization:
p i (θ) =
1, {i ∈ arg max
j
J j (θ j )} ∧ {J i (θ i ) ≥ 0}
0, otherwise
Satisfies monotonicity constraint!
The Optimal Auction
Assumption: F i = F , ∀i
Result: second-price auction with reservation price
that satisfies R ∗ − 1−F(R ϕ(R
∗)
∗) = 0 is optimal!
Equivalence between Bayesian and Dominant Strategy Incentive Compatible Mechanisms
Benny Moldovanu
University of Bonn
Summer Term 2015
A Problem in Discrete Tomography
Problem
When does a 0 1 matrix with given row and column sums exist ? Consider row sum ( 3 , 2 , 2 , 1 , 1 ) and two di¤erent column sums:
1 1 0 0 1 3
1 1 0 0 0 2
1 1 0 0 0 2
1 0 0 0 0 1
0 1 0 0 0 1
4 4 0 0 1
1 2! 0 0 0 3
1 1 0 0 0 2
1 1 0 0 0 2
1 0 0 0 0 1
1 0 0 0 0 1
5 4 0 0 0
Matrix exist if the vector of column sums is "less diverse" than the vector ( 5 , 3 , 1 , 0 , 0 ) .
See Gale (1957), and Ryser (1957) for the general result. Variations
(continuous case, densities) are in Kellerer (1961) and Strassen
(1965).
The Monotone Lift
Problem
When unique reconstruction is not possible, are there solutions with special properties ?
Theorem (Gutmann et al. (1991))
Let φ = φ ( x 1 , x 2 , .. x n ) be measurable on [ 0 , 1 ] n with 0 φ 1 . Assume that the one-dimensional marginals
Φ i ( x i ) =
Z
φ ( x 1 , x 2 , .. x n ) dx i
are non-decreasing in x i , i = 1 , 2 , .. n . Then there exists ψ measurable on
[ 0 , 1 ] n such that 0 ψ 1 , ψ has the same marginals as φ , and
moreover, ψ is non-decreasing in each coordinate.
Monotone Lift: Example
Example
φ =
2 4 4 10
4 2 6 12
4 6 4 14
10 12 14
= ) ψ =
2 4 4 10
4 4 4 12
4 4 6 14
10 12 14
Note that ∑ i , j ( ψ ij ) 2 ∑ i , j ( φ ij ) 2 .
The Independent Private Values Model with Linear Utility
K social alternatives and N agents. The utility of agent i in
alternative k is given by a k i x i + c i k + t i where x i 2 [ 0 , 1 ] is agent i ’s private type, where a k i , c i k 2 R with a k i 0 , and where t i 2 R is a monetary transfer.
Types are drawn independently of each other, according to strictly
increasing distributions F i . Type x i is private information of agent i .
Manelli and Vincent assume: K = N ; a i i = 1 , a j i = 0 for any j 6= i ;
c i k = 0 for any i , k .
Incentive Compatible Mechanisms I
De…nition
A direct revelation mechanism (DRM) M is given by K functions
q k : [ 0 , 1 ] N ! [ 0 , 1 ] and N functions t i : [ 0 , 1 ] N ! R where q k ( x 1 , ..., x N ) is the probability with which alternative k is chosen, and t i ( x 1 , ..., x N ) is the transfer to agent i if the agents report types x 1 , ..., x N .
De…nition
A DRM M is Dominant-Strategy Incentive Compatible (DIC) if
truth-telling constitutes a dominant strategy equilibrium in the game
de…ned by M and the given utility functions. A DRM M is Bayes-Nash
Incentive Compatible (BIC) if truth-telling constitutes a Bayes-Nash
equilibrium in the game de…ned by M and the given utility functions.
Incentive Compatible Mechanisms II
Fact
A necessary condition for M to be DIC is that, for each agent i , and for any signals of others, the function ∑ K k = 1 a k i q k ( x 1 , ..., x N ) is non-decreasing in x i . Moreover, any K functions q k that satisfy this condition are part of a DIC mechanism.
Fact
A necessary condition for M to be BIC is that, for each agent i , the function ∑ K k = 1 a k i Q i k ( x i ) is non-decreasing, where
8 i , k , Q i k ( b x i ) =
Z
[ 0 , 1 ]
N 1q k ( x 1 , ..., x i , b x i , x i + 1 , ..., x N ) dF i ,
is the expected probability that alternative k is chosen if agents j 6= i
report truthfully while agent i reports type b x i . Moreover any K functions
q k that satisfy this condition are part of a BIC mechanism.
Equivalent Mechanisms
De…nition
1
Two mechanisms M and M e are P-equivalent if, for each i , k and x i , it holds that Q i k ( x i ) = Q e i k ( x i ) , where Q i k and Q e i k are the conditional expected probabilities associated with M and M e , respectively.
2
Two mechanisms M and M e are U-equivalent if they provide the same interim utilities for each agent i and each type x i of agent i.
For each agent i , interim utility is obtained (up to a constant) by integrating the function ∑ K k = 1 a k i Q i k ( x i ) with respect to x i - this is the Payo¤ Equivalence Theorem. Thus P -equivalence implies
U -equivalence.
P- and U-Equivalence for 2 Alternatives
Since q 2 ( x 1 , ..., x N ) = 1 q 1 ( x 1 , ..., x N ) , we have
∑ 2 k = 1
a k i Q i k ( x i ) = a 2 i + ( a i 1 a 2 i ) Q i 1 ( x i ) ,
and therefore U-equivalence implies P -equivalence (the two notions coincide).
Theorem
Assume that K = 2 . Then for any BIC mechanism there exists a
P-equivalent (and thus U-equivalent) DIC mechanism.
U-Equivalence for Symmetric Settings
Theorem
Assume that a i k = a k j = a k for all k , i , j , and that F i = F for all i.
Moreover, assume that 0 = a 1 a 2 a K = 1. Then for any symmetric, BIC mechanism there exists an U-equivalent symmetric DIC mechanism
Proof shows how to achieve U-equivalence using only the 2
alternatives with highest and lowest slope, respectively. Thus,
U-equivalence does not necessarily ensure that the ex-ante
probabilities of di¤erent alternatives are preserved.
Multidimensional Types
Benny Moldovanu
University of Bonn
Summer Term 2015
Multidimensional Types
v i (k, θ i ) = θ k i Types - ind. distributed Vector Field: q i k (θ i ) = E θ
−i[p i k (θ)]
T i (θ i ) = E θ
−i[t i (θ)]
U i (θ i , θ ˆ i ) = θ i ∗ q i (ˆ θ i ) + T i (ˆ θ i )
Multidimensional Types + Bayesian Implementation
Theorem (Jehiel, Moldovanu, Stacchetti, JET (1999)) The mechanism
{p k i } k∈K , t i i∈I is Bayes-Nash incentive compatible if and only if:
1
[q i (θ i ) − q i ( ˆ θ i )] · [θ i − θ ˆ i ] ≥ 0
2
U ˆ i (θ i ) = ˆ U i (θ i ) + R θ
iθ
iq i (s) · ds, ∀i , θ i
Path independence!
Multidimensional Types
Example two objects
1 buyer, valuations θ A , θ B
Mechanism: P A .P B , P AB < P A + P B
Multidimensional Types + Private Values
Observation
k(θ i , θ −i ) = k(ˆ θ i , θ −i )
⇒ t i (θ i , θ −i ) = t i (ˆ θ i , θ −i ) Lemma
k(θ i , θ −i ) = l, k(ˆ θ i , θ −i ) = ˆ l
⇒ θ ˆ ˆ i l − θ ˆ i l ≥ θ ˆ i l − θ i l ∀θ i , θ ˆ i , θ −i
Weak monotonicity!
Multidimensional Types + Private Values
Proof.
θ l i + t i (θ i , θ −i ) ≥ θ ˆ l i + t i (ˆ θ i , θ −i ) θ ˆ ˆ l i + t i (ˆ θ i , θ −i ) ≥ θ ˆ l i + t i (θ i , θ −i )
⇒ θ i l + ˆ θ ˆ i l ≥ θ ˆ i l + ˆ θ i l
⇒ θ ˆ ˆ i l − θ ˆ i l ≥ θ ˆ i l − θ i l
Multidimensional Types + Private Values
Theorem (Saks-Yu)
Assume types spaces are convex, and consider k(θ). There exist
t 1 (θ), · · · , t I (θ) such that f (θ) = [k(θ), t 1 (θ), · · · , t I (θ)] is truthfully
implementable in dominant strategies if and only if k (θ) is weakly
monotone.
Affine Maximizers
α 1 , · · · , α I ∈ R +
R 1 , · · · , R K ∈ R
k(θ) ∈ arg max
k
" I X
i=1
α i V i (k , θ i ) + R k
#
Affine Maximizers
Theorem (Roberts)
Let Θ i = R |K| and |K | ≥ 3. Then f (θ) is truthfully implementable in
dominant strategies if and only if the associated k (θ) is an affine
maximizer.
Interdependent Values
Benny Moldovanu
University of Bonn
Summer Term 2015
Akerlof’s Model
Sellers with cars of quality θ ∈ [θ, θ] ¯
F (θ); F 0 (θ) = f (θ) > 0
Utility =
( θ − P, buyer
R(θ) + P , seller
Complete Information
Equilibrium Condition
P (θ) = θ
S (P ) = {θ|R(θ) ≤ θ} = D(P )
EfficientTrade!
Incomplete Information
S (P ) = {θ|R(θ) ≤ P } E (P ) ≡ E[θ|θ ∈ S (P )]
D(P ) =
0, E (P ) < P
∈ [θ, θ], ¯ E (P ) = P
[θ, θ], ¯ E (P ) > P
Equilibrium : P ∗ = E (P ∗ )
Incomplete Information
Example
R(θ) = 2
3 θ; F (θ) = θ on [0, 1]
E [θ| 2
3 θ ≤ P ] = E [θ|θ ≤ 3 2 P ] = 3
4 P P ∗ = 3
4 P ∗ ⇒ P ∗ = 0
No car is sold at all!
Interdependent Values
u i (x , θ 1 , · · · , θ J ) = V i (k , θ 1 , · · · , θ J ) + t i
VCG Transfer:
t i ∗ (θ) = X
j6=i
V j (k, θ) + h i (θ −i ) Problem: t i ∗ depends on θ i !
Solution?
Interdependent Values
Example (1 Object, 2 Bidders)
k = 1, 2
V i (k , θ) =
( 0, k 6= i aθ i + bθ −i , k = i where a > b > 0
k ∗ (θ) =
( 1, θ 1 ≥ θ 2
2, θ 1 < θ 2
Interdependent Values
Example (1 Object, 2 Bidders)
Important Condition
∂V i (θ)
∂θ i > ∂V j (θ)
∂θ i , ∀i , j Equilibrium Notion
Nash Equilibrium (ex-post)
Bilateral Bargaining
Seller :V S (θ S , θ B ) % θ S Buyer :V B (θ S , θ B ) % θ B
∂V S
∂θ S > ∂V B
∂θ S ; ∂V B
∂θ B > ∂V S
∂θ B
Bilateral Bargaining
Definition
V B (θ S , θ B ∗ (θ S )) = V S (θ S , θ B ∗ (θ S )) V S (θ ∗ S (θ B ), θ B ) = V B (θ ∗ S (θ B ), θ B )
k ∗ (θ) =
( S, V S (θ) ≥ V B (θ)
B, V B (θ) > V S (θ)
Bilateral Bargaining
Definition (cont.)
t B ∗ (θ) =
( 0, k ∗ = B V S (θ S , θ ∗ B (θ S ), k ∗ = S t S ∗ (θ) =
( 0, k ∗ = S
V B (θ ∗ S (θ S ), θ B ), k ∗ = B
Modified VCG payments
Conditions for efficient trade (Fieseler, Kittsteiner, Moldovanu, JET (2003))
E θ
S[V B (θ S , θ B )] ≥ P ≥ E θ
B[V S (¯ θ S , θ B )]
Akerlof’s case:
E θ
S[V B (θ S )] ≥ P ≥ V S (¯ θ S ) 1
2 < 2
3
Multidimensional Types+ Interdependent Values
Benny Moldovanu
University of Bonn
Summer Term 2015
Multidimensional Types + Interdependent Values
V i (k, θ 1 , · · · , θ J ) Example
2 agents, i = 1, 2
2 alternatives, k = A, B
V i k (θ k 1 ), i = 1, 2; k = A, B
(Only agent 1 is informed)
Multidimensional Types + Interdependent Values
Example (cont.)
Value Maximization k(θ 1 ) ∈ arg max
k 2
X
i=1
V i (k, θ k 1 ) Incentives for agent 1:
k (θ 1 ) ∈ arg max
k
[V 1 (A, θ A 1 ) + t 1 A , V 1 (B, θ 1 B ) + t 1 B ]
Multidimensional Types + Interdependent Values
Example (cont.)
Multidimensional Types + Interdependent Values
Example (cont.)
Congruence Condition
∂V
1(A,θ
1A)
∂θ
A1∂V
1(B,θ
1B)
∂θ
B1=
∂
∂θ
A1h P 2
i=1 V i (A, θ 1 A ) i
∂
∂θ
B1h P 2
i=1 V i (B , θ 1 B ) i
Non-generic condition!
Theorem
Theorem (Jehiel et al., Econometrica (2001))
For generic utility functions only constant social choice functions are truthfully implementable in ex-post equilibrium.
Robust implementation is impossible!
Multidimensional Types + Conservative Vector Fields
Incentive compatibility ⇔ the vector field q i is 1) monotone
2) conservative
⇓
∂ 2 q i k (θ i )
∂θ i k ∂θ i k
0= ∂ 2 q i k
0(θ i )
∂θ k i
0∂θ k i
Mechanism Design Without Money
Benny Moldovanu
University of Bonn
Summer Term 2015
Mechanism Design Without Money
Usual setting with general utility function U i (x, θ i ) - private values let R i = {≺ i | ≺ i =≺ i (θ i ) for some θ i }
ordinal preferences
Mechanism Design Without Money
Definition
L i (x, ≺ i ) = {y|y ≺ i x}
A social choice function f is monotonic if
∀θ, L i (f (θ), θ i ) ⊆ L i (f (θ), θ i 0 )∀i ⇒ f (θ) = f (θ 0 )
=
(θ −i , θ i 0 )
Impossibility Theorem
Theorem (Gibbard-Satterthwaite)
Assume that X is finite with |X | ≥ 3, and that ∀i, P = R i , where P is the set of all rational preferences (without indifference).
Let f be onto and dominant strategy incentive compatible; then f is
dictatorial!
Mechanism Design Without Money
Proof GS (Sketch).
1
R i = P and f DIC ⇒f is monotonic
2
R i = P and f DIC and onto ⇒f is pareto efficient
3
f is monotonic and efficient
⇒ f is dictatorial
Mechanism Design Without Money
Possibility results:
1
|X | = 2 - simple majority rule
2
single peaked preference
Single Peaked Preferences
Theorem
Let preferences be single-peaked and let the number of agents be odd.
Then the SCF that chooses at each profile the median peak is dominant
strategy incentive compatible.
Single Peaked Preferences
Theorem (Moulin 1980)
Consider a setting with n agents, and let R i = SP ∀i (with respect to a given order K).
Let f be DIC, anonymous and unanimous. Then there exist n − 1 phantom
voters such that f chooses the median of all voters’ peaks.
Successive Voting With Thresholds
Voting on single alternatives in the SP order (say 1, 2, · · · , K ). k is chosen
if the number of yes votes is at least τ (k ), where τ (k) ≥ τ (k 0 ), k ≤ k 0 . If
no alternative passes threshold, K is chosen.
Successive Voting With Thresholds
Sincere Strategy for voter with peak on k:
No, No, · · · , No Yes , Yes, · · · , Yes 1, 2, · · · , k − 1 k, k + 1, · · · , K
Monotone strategy:
No, No, · · · , No Yes , Yes, · · · , Yes 1, 2, · · · , l l + 1, · · · , K
Sincere ⇒ monotone
Markov strategies
Successive Voting With Thresholds
Theorem
Assume that all players besides i use monotone strategies. Then it is
optimal for i to use the sincere strategy. In particular, sincere voting is an
ex-post perfect Nash equilibrium.
Successive Voting With Thresholds
Theorem
Equivalence for single-peaked preferences.
Anonymous Succsessive
Unanimous ⇐⇒ voting with DIC mechanisms decreasing
threshold τ (k)
Optimization
How many anonymous, unanimous, DIC mechanisms are there?
Optimization
2 alternatives, A, B
n mechanisms (supermajority) l A - number of phantoms on A l B = n − 1 − l A
utility: u A (x), u B (x), x ∈ [0, 1]
types x i.i.d., distribution F
single crossing:
Optimization
Definition
u L A = E h
u A (x)|x ≤ x AB i u A H = E
h
u A (x)|x ≥ x AB i
u L B = E h
u B (x)|x ≤ x AB i u H B = E
h
u B (x)|x ≥ x AB
i
Optimization
γ = u L A − u B L
u L A − u L B + u B H − u H A > 0 First order conditions:
changing l A to l A + 1 or l A − 1 should not be beneficial l A = [nγ ]
Two-Sided Matching Gale-Shapley 1961
Benny Moldovanu
University of Bonn
Summer Term 2015
Two-Sided Matching
M = {m 1 , · · · , m n } W = {w 1 , · · · , w p } M ∩ W = ∅
P (m i ) = w j , w k , · · · m i w l · · ·
P (w j ) = m i , m l , · · · w j m n · · ·
Ranked ordinal lists
Two-Sided Matching
Matching:
µ: M ∪ W −→ M ∪ W
1
µ 2 (x) = x, ∀x ∈ M ∪ W
2
µ(m) ∈ W ∪ {m}
3
µ(w ) ∈ M ∪ {w }
Individual rationality: µ(x) %
x
x, ∀x ∈ M ∪ W
Two-Sided Matching
Stability: µ is stable if:
1
µ is individually rational, and
2
@ {m, w } such that µ(m) 6= w and
w
m µ(m)
m
w µ(w )
Two-Sided Matching
Theorem (Gale, Shapley (1962))
For any two-sided market, the set of stable matchings is non-empty.
Proof.
Deferred acceptance algorithm (Gale-Shapley).
Two-Sided Matching
Example
P (m 1 ) = w 2 w 1 w 3 P(w 1 ) = m 1 m 3 m 2 P (m 2 ) = w 1 w 3 w 2 P(w 2 ) = m 3 m 1 m 2 P (m 3 ) = w 1 w 2 w 3 P(w 3 ) = m 1 m 3 m 2
µ 1 =
w 1 w 2 w 3 m 1 m 2 m 3
µ 2 =
w 2 w 1 w 3 m 1 m 2 m 3
Stable!
The Roommate Problem
P(a)=bcd P(b)=cad P(c)=abd P(d)=abc
µ 1 = ab
| | cd µ 2 = a — b
c — d µ 3 = ab
| | dc
None
is
stable!
Lattice Operator
µ ∨ M µ 0 (m) =
µ(m), if µ(m)
m µ 0 (m) µ 0 (m), otherwise
µ ∨ M µ 0 (w ) =
µ(w ), if µ(w )
w µ 0 (w ) µ 0 (w ), otherwise
and analogously for ∧ M .
Lemma
Lemma (Conway)
Let µ, µ‘ be stable matchings. Then µ ∨ M µ 0 and µ ∧ M µ 0 are also stable matchings.
Consequence: M-Optimal and W-Optimal stable matchings.
Strategic Questions
Theorem
There is no mechanism such that:
1. It is a dominant strategy for all agents to state preferences truthfully.
2. A stable matching is chosen for every report.
Strategic Questions
Proof.
M = {m 1 m 2 } W = {w 1 w 2 } P (m 1 ) = w 1 w 2 P (w 1 ) = m 2 m 1 P (m 2 ) = w 2 w 1 P (w 2 ) = m 1 m 2
µ M = m 1 m 2
w 1 m 2 µ W = m 1 m 2
w 2 w 1
Suppose Γ(p) = µ M
Consider strategy Q (w 2 ) = m 1 then Γ(p −w
2
, Q(w 2 )) = µ W
Strategic Questions
Theorem
Let Γ = Γ M be the mechanism that assigns to each profile of reports the
M-optimal stable matching. Then truthful reporting is a dominant
strategy for all men.
Strategic Questions
Theorem
Consider a Nash equilibrium of Γ M where men use their dominant
strategies (and women respond optimally). Then the outcome is a stable
matching for the true preferences!
Strategic Questions
Proof.
P - True Preferences.
P 0 → stated preferences.
Let µ 0 = Γ(P 0 ). Assume {m,w} block µ 0 . Then, in Γ M (p 0 ) m must have
proposed to w, and she rejected him. Consider P 0 (w ) = m ⇒ then {m, w }
would be matched. Contradiction to P 0 being an equilibrium.
Many-to-one Matching
n firms: F i = {F 1 , · · · , F n } m workers: W = {W 1 , · · · , W m } matching: µ : F ∪ W → 2 F ∪W
1
|µ(w )| = 1, ∀w ∈ W
2
µ(w ) = w , if µ(w ) ∈ / F
3
µ(F ) ⊆ W [µ(F ) = ∅]
4
µ(w ) = F i ⇔ w ∈ µ(F i )
Many-to-one Matching
P (w i ) = F i , F j , · · · , F k , w i , · · · P (F j ) = S 1 .S 2 . · · · , ∅, · · · where S i ⊆ W (sets of workers) Definition
Ch F (S ) = S 0 ⇔ ∀S 00 ⊆ S , it holds that S 0
F S 00 .
Many-to-one Matching
Matching is blocked by {w , F } if:
1
µ(w ) 6= F
2
F
w µ(w )
3
w ∈ Ch F (µ(F ) ∪ {w }) Individual rationality:
µ(w ) %
w
w
µ(F ) = Ch F (µ(F )) %
F
∅
Many-to-one Matching
Definition
Firms have substitutable preferences if: ∀S, w , w 0 ∈ S w ∈ Ch F (S ) ⇒ w ∈ Ch F (S \ w 0 ).
Theorem
If all firms have substitutable preferences, then the set of stable matchings is not empty.
Proof.
Run G-S algorithm with firms proposing.
The Assignment Game
M ∩ W = ∅
V (S ) = 0 if S ⊆ M , or S ⊆ W V (S ) = max
µ
SP
m∈S v(m, µ s (m))
where µ S is a matching on coalition S.
The Assignment Game
µ ∗ is optimal if V (M ∪ W ) = P
m∈M v(m, µ ∗ (m)) w 1 w 2 w 3
m 1 10 11 7
m 1 6 8 2
m 3 5 5 9
Optimal
matching
generically
unique.
The Assignment Game
Interpretation:
M-sellers, each has indivisible object; reserve price: c m .
W-buyers, each wants at most one object; value for object m: r wm .
v (m, w ) = max{0, r wm − c m }
The Assignment Game
Stable payoff vectors
1
feasible: P
i∈M∪W x i ≤ V (M ∪ W )
2
ind. rational: x i ≥ 0, ∀i ∈ M ∪ W
3
no blocking: x m + x w ≥ v (m, w ), ∀m, w
The Assignment Game
Example
w 1 w 2
m 1 5 3
m 2 7 8
(x m
1, x w
1, x m
2, x w
2) (2.5, 2.5, 4, 4)
(1, 4, 3, 5)
Stable
The Assignment Game
Theorem (Shapley-Shubik)
The set of stable payoff vectors is not empty.
Proof.
min X
m∈M
x m + X
w∈W
x w
!
s.t.
1
x i ≥ 0 ∀i ∈ M ∪ W
2
x m + x w ≥ v(m, w ), ∀m, w
The Assignment Game
Proof. (cont.)
Program has solution. Let R be the minimum. Need to show feasibility R ≤ V (M ∪ W ).
Dual program
max X
i,j
p ij v(i, j ) s.t.
1
P
i p ij ≤ 1, ∀j
2
P
j p ij ≤ 1, ∀i
3
p ij ≥ 0, ∀i, j
The Assignment Game
Proof. (cont.)
Dual has solution with p ij ∈ {0, 1}, p ij = 1 ⇒ i ∈ M , j ∈ W or vice-versa.
The max achieved equals R (duality theorem). Obvious now that
R ≤ V (M ∪ W )
The Assignment Game
Lemma
Let x , y be stable payoff vectors. Define:
u m = max(x m , y m ), ∀m ∈ M u w = min(x w , y w ), ∀w ∈ W
Then u is also a stable payoff vector (and analogously for women).
Proof.
Exercise!
The Assignment Game
Consequence:
The set of stable payoff vectors is a lattice with a maximal and minimal element.
Proof.
Above Lemma + compactness
The Assignment Game
Example (homogeneous objects)
W M
25 11 23 16 20 19 17 21 10 22 6 24 5
competitive prices 19 ≤ P ≤ 20
19 20
w 1 6 5
w 2 46 3
w 3 1 0
m 1 8 9
m 2 3 4
m 3 0 1
The Assignment Game
Example
(m 1 , m 2 , w 1 , w 2 ) P 1 , P 2 (1, 0, 2, 3) −→ (1, 0) (3, 2, 0, 1) −→ (3, 2)
w 1 w 2
m 1 3 4
m 2 1 3
The Assignment Game
Example (cont.) Vickrey Prices P 1 = 1; P 2 = 0
(each buyer pays externality)
w 1 w 2
m 1 3 4
m 2 1 3
⇒ Outcome equivalent to minimal stable payoff vector (buyer optimal).
The Simultaneous Ascending Clock Auction
M - objects; W - buyers
c m
r wm
(c
mand r
wmare integers)
Assume M contains dummy object m 0 : c m
0= 0
r wm
0= 0, ∀w
Dummy can be assigned to several buyers
The Simultaneous Ascending Clock Auction
Let P be a vector of prices, one for each object in M D w (P ) = {m ∈ M|r wm − P m ≥ max
m
0∈M (r wm
0− P m
0)}
→ Demand of w at P
The Simultaneous Ascending Clock Auction
Definition
P is quasi-competitive if there exists a matching µ such that:
1
µ(w ) = m ⇒ m ∈ D w (P )
2
µ(w ) = w ⇒ m 0 ∈ D w (P )
Competitive equilibrium (P , µ):
1
quasi-competitive +
2
P m = c m if m ∈ / µ(W )
The Simultaneous Ascending Clock Auction
Lemma
1
Every competitive equilibrium yields a stable payoff vector.
2
Every stable payoff vector can be obtained via a competitive equilibrium.
Proof.
Exercise.
Hall’s Theorem
Let B,C be disjoint sets ∀b ∈ B, D b ⊆ C Can we find a matching µ : B → C such that
1
∀b, µ(b) ∈ D b
2